Adaptive load balancing

ABSTRACT

Methods and systems for performing load balancing within an Ethernet network are provided. According to one embodiment, a set of virtual networks, into which a network has been logically divided that can be used by a first component is maintained. Each of the virtual networks is a loop-free switching path, reverse path learning network and provides a path through the network between the first component and a second component. A packet destined for the second component is received by the first component. On a packet-by-packet basis or on a per flow basis, the first component dynamically selects a particular path by selecting a virtual network for transporting the received packet that tends to balance traffic load across the virtual networks. The first component causes the received packet to be transported through the network to the second component via the particular path.

CROSS-REFERENCE TO RELATED APPLICATIONS

This is a continuation of U.S. patent application Ser. No. 12/848,167,filed on Jul. 31, 2010, which is a continuation of U.S. patentapplication Ser. No. 11/732,599, filed on Apr. 3, 2007, now U.S. Pat.No. 7,774,461, which is a continuation-in-part of U.S. patentapplication Ser. No. 11/336,713, filed on Jan. 20, 2006, now abandoned,which is a continuation-in-part of U.S. patent application Ser. No.11/056,436, filed on Feb. 10, 2005, now U.S. Pat. No. 7,463,588, whichclaims the benefit of priority of U.S. Provisional Application No.60/545,788, filed on Feb. 18, 2004. The contents of all theaforementioned patent applications are hereby incorporated by referencein their entirety for all purposes.

COPYRIGHT NOTICE

Contained herein is material that is subject to copyright protection.The copyright owner has no objection to the facsimile reproduction ofthe patent disclosure by any person as it appears in the Patent andTrademark Office patent files or records, but otherwise reserves allrights to the copyright whatsoever. Copyright © 2004-2012, Fortinet,Inc.

BACKGROUND

1. Field

Embodiments of the present invention generally relate to computernetworking. In particular, embodiments of the present invention relateto performing load balancing within an Ethernet network.

2. Description of the Related Art

Over the past several years, the computing and storage server industrieshave been migrating towards a network-based computing and storage modelto take advantage of lower cost, high-performance commodity processorsand lower cost, high-density storage media. This server industry trendhas created a need for a highly scalable interconnect technology toenable the various computing and storage resources to be efficiently andeffectively coupled. One type of interconnect that has been consideredfor this purpose is an Ethernet network.

An Ethernet network is a loop-free switching path, reverse path learningnetwork. By “loop-free”, it is meant that there is only one path betweenany pair of nodes in the network. Because of this loop-free property, itis possible for the switches in an Ethernet network to forward packetsby broadcast flooding, and to populate their forwarding tables throughreverse path learning.

Specifically, when an Ethernet switch encounters a packet with adestination node address that it does not have in its forwarding tables,the switch broadcasts that packet on all outgoing links, except for thelink on which the packet was received. All subsequent switches thatreceive the packet that do not have the destination node address intheir forwarding tables do the same thing. Eventually, the packet willbe delivered to the destination node. Because there is only one path tothe destination node, it is assured that broadcasting the packet in thisway will not create an infinite loop of broadcasts.

In addition to broadcasting the packet, a switch also determines, fromthe packet, the address of the source node that sent the packet. It alsonotes the link on which the packet was received. This address and linkassociation is stored in the forwarding tables of the switch. In thefuture, if the switch receives any packet destined for the source node,it will know, based upon the address and link association in theforwarding tables, which link to switch the packet to. It will not needto broadcast the packet. In this way, an Ethernet switch learns thereverse path of a packet. Because of this reverse path learningcapability, it is not necessary to pre-configure the forwarding tablesof Ethernet switches. The switches can build these forwarding tables onthe fly. This self learning capability of Ethernet switches is a key“plug and play” attribute of an Ethernet network, and is one of thereasons why Ethernet is so widely deployed.

While the loop-free aspect of an Ethernet network gives rise to certainadvantages, it also is the root of several significant drawbacks. First,because there is only one path between each pair of nodes, the networkdoes not recover from failure as quickly as would be desired. When alink in a path is disabled, another path has to be determined anddeployed. This takes a relatively long time, and during that time, nodescoupled via that link cannot communicate. Another drawback is that thesingle path between each pair of nodes limits the cross sectionbandwidth of the network; thus, the switching capacity of the network isunderutilized. Furthermore, because there is only one path between eachpair of nodes, it is not possible to spread and balance the trafficacross a plurality of paths. For these and other reasons, Ethernet, asit has been implemented, has not been an effective interconnect forcoupling computing and storage resources in a network-based,high-performance system.

SUMMARY

Methods and systems are described for performing load balancing withinan Ethernet network. According to one embodiment, a set of virtualnetworks, into which a network has been logically divided that can beused by a first component of multiple components coupled incommunication with a network, is maintained. Each virtual network of theset of virtual networks is a loop-free switching path, reverse pathlearning network and each virtual network provides a path through thenetwork between the first component and a second component of themultiple components thereby collectively providing multiple pathsthrough the network between the first component and the secondcomponent. A packet destined for the second component is received by thefirst component. On a packet-by-packet basis or on a per flow basis, thefirst component dynamically selects a particular path of the multiple ofpaths by selecting a virtual network of the set of virtual networks fortransporting the received packet that tends to balance traffic loadacross the set of virtual networks. The first component causes thereceived packet to be transported through the network to the secondcomponent via the particular path.

Other features of embodiments of the present invention will be apparentfrom the accompanying drawings and from the detailed description thatfollows.

BRIEF DESCRIPTION OF THE DRAWINGS

Embodiments of the present invention are illustrated by way of example,and not by way of limitation, in the figures of the accompanyingdrawings and in which like reference numerals refer to similar elementsand in which:

FIG. 1 shows a sample Ethernet network.

FIG. 2 shows the sample Ethernet network of FIG. 1 after it has beendivided into two virtual networks.

FIG. 3 shows a sample loop-free switching path, reverse path learningnetwork in which multiple virtual networks have been established toprovide multiple paths between each pair of nodes.

FIG. 4A shows a sample Ethernet packet before path-selection virtualnetwork information is added.

FIG. 4B shows the Ethernet packet of FIG. 4A after path-selectionvirtual network information has been added.

FIG. 4C shows a sample Ethernet packet that contains both path-selectionvirtual network information and node-provided virtual networkinformation.

FIG. 5 is a functional block diagram of a network interface, inaccordance with one embodiment of the present invention.

FIG. 6 is a flow diagram illustrating the operation of a networkinterface in accordance with one embodiment of the present invention.

FIG. 7 shows a multi-path load balancing (MPLB) component implemented inthe sample network of FIG. 3, in accordance with one embodiment of thepresent invention.

FIG. 8 is a functional block diagram of an MPLB, in accordance with oneembodiment of the present invention.

FIG. 9 is a flow diagram illustrating the operation of an MPLB inaccordance with one embodiment of the present invention.

FIG. 10 is a flow diagram illustrating how load balancing may beperformed in accordance with one embodiment of the present invention.

FIGS. 11A and 11B illustrate how latency values may be derived inaccordance with one embodiment of the present invention.

FIGS. 12A and 12B illustrate how a clock offset value and latency valuesmay be derived in accordance with one embodiment of the presentinvention.

DETAILED DESCRIPTION

Methods and systems are described for performing load balancing in anetwork. One embodiment of the present invention is implemented in aloop-free switching path, reverse path learning network, such as anEthernet network. Before describing this embodiment in detail, someadditional information on Ethernet networks will be provided tofacilitate a complete understanding of the invention.

Ethernet Networks

FIG. 1 shows a sample Ethernet network. As shown, the network 100comprises four Ethernet switches a, b, c, and d. The switches areconnected to each other by links 1 through 6. Coupled to each switch aretwo end nodes, identified by their Ethernet MAC (media access control)addresses. Specifically, switch a is coupled to the nodes with MACaddresses S and T. Switch b is coupled to the nodes with MAC addresses Uand V. Switch c is coupled to the nodes with MAC addresses W and X, andswitch d is coupled to the nodes with MAC addresses Y and Z.

In an Ethernet network, the path between each pair of nodes isdetermined using a spanning tree protocol (STP). The STP ensures thatthere is no more than one path between each pair of nodes so that thenetwork 100 is “loop-free”. If an STP is applied to the network 100 ofFIG. 1 with switch a being designated as the root switch, then the linkconfiguration shown in FIG. 1 may result, where links 1, 2, and 6 (shownin solid lines) are put into a forwarding state, and links 3, 4, and 5(shown in dashed lines) are blocked. Because links 3, 4, and 5 areblocked, they cannot be used to carry traffic; thus, for example, switchc cannot send any information to switch d using link 3. Blocking some ofthe links in this manner enforces the requirement that there be one andonly one path between each pair of nodes. The resulting tree structurecomposed of links 1, 2, and 6 allows all switches to forward packets toeach other without encountering a forwarding loop.

Suppose now that one of the nodes (say the one with MAC address Z) wantsto send an Ethernet packet to the node with MAC address U. To do so, itfirst sends the packet to switch d. Switch d looks into its forwardingtable, and if it does not find MAC address U, it broadcasts the packetto its outgoing ports, in this case the port to link 6 and the portconnected to the node with MAC address Y. Ethernet packets that arriveat nodes for which the MAC address does not match will be dropped; thus,the node with MAC address Y will drop the packet. Switch a then receivesthe packet and looks into its forwarding table for MAC address U. If itdoes not find MAC address U, it broadcasts the packet to its outgoinglinks, in this case links 1 and 2, and to both of its connected nodes.When the packet arrives at switch b, switch b looks into its forwardingtable, and if it does not find MAC address U in the forwarding table, itbroadcasts the packet to its outgoing links, in this case to the nodeswith MAC address U and MAC address V. The node with MAC address U thusreceives the packet. In this way, the node with MAC address Z is able tosend an Ethernet packet to the node with MAC address U without the nodesor the intermediate switches knowing the forwarding path beforehand.

This broadcast or flooding mechanism, while effective, can causeunnecessary traffic over the switching links. Ethernet solves thisproblem by using reverse path learning to create a forwarding tableassociation between MAC addresses and ports. In reverse path learning,the switches look at the source MAC address of the Ethernet packets thatthey receive, and populate their forwarding tables with the MACaddress/received port associations. In the above example, when the nodewith MAC address U later sends a packet to the node with MAC address Z,all of the switches in the path (switch b, switch a and switch d) willhave “learned” the association of the MAC address Z with the respectivereceived port from the previous received Ethernet packet. Therefore,switch b will know to forward Ethernet packets with MAC address Z as thedestination address on link 1 since that was the link on which itreceived Ethernet packets with MAC address Z as the source MAC address.Likewise, switch a will know to switch such packets to link 6.Similarly, switch d will know to forward such packets to the portconnected to the node with MAC address Z. In this way, the networkself-learns the reverse paths so that broadcast and flooding isperformed in very few instances. The key ingredient to making reversepath learning possible is the fact that there is only one path betweeneach pair of nodes.

Virtual Networks within Ethernet Networks

In an Ethernet network, it is possible to divide the network into one ormore virtual networks (also referred to herein as virtual local areanetworks, or VLANs). Doing so allows the network to be divided intomultiple switching domains to limit the links on which packet broadcastsare performed. Virtual networks also allow nodes to be segregated sothat only certain nodes are allowed to communicate with each other.

FIG. 2 shows an example of the network 100 of FIG. 1 after it is hasbeen divided into two VLANs, VLAN 1 and VLAN 2. In this example, switcha is the STP root for VLAN 1 and switch d is the STP root for VLAN 2. Inthis example, VLAN 1 is configured in the same way as that describedpreviously for FIG. 1, namely, links 1, 2 and 6 are placed in aforwarding state and links 3, 4 and 5 are blocked. For VLAN 2, links 2,4, and 6 are placed in a forwarding state and links 1, 2, and 5 areblocked. Thus, in this configuration, link 5 is always blocked and link6 carries traffic for both VLAN 1 and VLAN 2.

Each end node is associated with one of the VLANs. Specifically, thenodes with MAC addresses S, U, X, and Y are on VLAN 1, and the nodeswith MAC addresses T, V, W, and Z are on VLAN 2. Set up in this way, thenodes with MAC addresses S, U, X, and Y will be able to communicate witheach other but not with the nodes with MAC addresses T, V, W, and Z.Similarly, the nodes with MAC addresses T, V, W, and Z will be able tocommunicate with each other but not with the nodes with MAC addresses S,U, X, and Y. In this way, the VLANs separate the various nodes intodifferent domains such that the nodes are treated as if they are inseparate networks even though they are in the same physical network.

VLANs also enable the broadcasting of packets to be limited to certainlinks. To illustrate this point, suppose that the node with MAC addressW wishes to send an Ethernet packet on VLAN 2 to the node with MACaddress V. To do so, it first sends the packet to switch c. Switch clooks into its forwarding table, and if it does not find MAC address V,it broadcasts the packet to its outgoing ports which support VLAN 2, inthis case the port to link 3. It does not broadcast to link 2 or to theport coupled to the node with MAC address X since these ports supportVLAN 1 only. Switch d then receives the packet and looks into itsforwarding table for MAC address V. If it does not find MAC address V,it broadcasts the packet to its outgoing links that support VLAN 2, inthis case links 4 and 6, and to the node with MAC address Z. When thepacket arrives at switch b, switch b looks into its forwarding table,and if it does not find MAC address V in the forwarding table, itbroadcasts the packet to its outgoing links that support VLAN 2, in thiscase to the node with MAC address V. In this way, the node with MACaddress V receives the packet. With the use of a VLAN, the packetreaches the destination with broadcasts over a fewer number of links.

A point to note about VLANs is that they in and of themselves areloop-free switching path, reverse path learning networks. Each VLANprovides one and only one path between each pair of nodes; thus, packetbroadcast and reverse path learning can still be performed.Consequently, VLANs implemented within an Ethernet network retain theadvantages of Ethernet networks.

Multiple Switching Paths

VLANs have primarily been used to segregate traffic within a network. Ithas been observed by Applicants, however, that VLANs may also be used toprovide multiple paths between node pairs. For example, if all of thenodes in FIG. 2 are associated with both VLAN 1 and VLAN 2, then variousnodes would have two possible paths to various other nodes. For example,the node with MAC address Y would have two paths to the node with MACaddress V. Using VLAN 1, the path would be from switch d to link 6 toswitch a to link 1 to switch b. Using VLAN 2, the path would be fromswitch d to link 4 to switch b. Thus, by setting up multiple VLANs, andby associating nodes with multiple VLANs, it is possible to providemultiple paths between each pair of nodes. These multiple paths willenable load balancing to be performed, fault tolerance to be enhanced,and switching capacity to be more fully utilized. As an additionalpoint, these benefits can be realized without losing the advantages of aloop-free switching path, reverse path learning network. As noted above,VLANs do not violate any of the fundamentals of a loop-free switchingpath, reverse path learning network. Thus, by setting up multiple VLANs,and by associating nodes with multiple VLANs, it is possible to providemultiple paths between node pairs, even in a loop-free switching path,reverse path learning network, such as an Ethernet network.

Sample Multi-Path Network

FIG. 3 shows an example of a loop-free switching path, reverse pathlearning network 300 in which multiple VLANs have been established toprovide multiple paths between each pair of nodes. Specifically, innetwork 300, there are four VLANs (VLANs 1 through 4); thus, there arefour possible paths between each pair of nodes.

In FIG. 3, the components labeled with lower case letters are switches,and the components identified with capital letters are nodes. For thesake of convenience, the same capital letter is used to identify both anode and its MAC address. Thus, node A has MAC address A, node F has MACaddress F, and so forth. For the sake of simplicity, only some of thenodes in the network 300 are shown. Each link has one or more numbersplaced next to it. This number indicates the VLAN that is supported onthat link. For example, the link between switch a and switch j has thelabel “3,4”. This means that the link supports VLANs 3 and 4. Given thislabeling system, it can be seen that each of the links going to and froma node supports all four VLANs. Thus, each node can use and can bereached via any of the four VLANs.

In network 300, switch q is the root switch for VLAN 1, switch r is theroot switch for VLAN 2, switch s is the root switch for VLAN 3, andswitch t is the root switch for VLAN 4. Applying an STP to network 300using each of the above switches as root switches will cause fourspanning trees to be produced. Each spanning tree will represent one ofthe VLANs, and each spanning tree will specify the loop-free pathsbetween all of the nodes. The topology shown in FIG. 3 may be the resultof this process. To enforce the spanning trees, the various switches maybe configured, either manually or by an automated network manager (notshown), to associate each link with one or more VLANs. For example,switches a and j may be configured to associate the link between themwith VLANs 3 and 4. By configuring the switches in this way, each switchwill know which links can be used with which VLAN or VLANs. In oneembodiment, each spanning tree and hence, each VLAN, provides adifferent path from a source node to a destination node. For example, onVLAN 1, the path from node A to node K would be from switch a to switchi to switch q to switch m to switch f. On VLAN 4, the path from node Ato node K would be from switch a to switch j to switch t to switch n toswitch f. By choosing different VLANs, packets can be sent from a sourcenode to a destination node along different paths.

To enable an Ethernet packet to be properly switched according to VLANs,some information is added to each packet. FIG. 4A shows a standardEthernet packet comprising a destination MAC address 402, a source MACaddress 404, and data and other control information 406. In oneembodiment, to VLAN enable a packet, a set of path-selecting VLANinformation 408 is inserted into the packet between the source MACaddress 404 and the data and other control information 406, as shown inFIG. 4B. The VLAN information 408 may include information (e.g. a VLANID) indicating which VLAN is to be used to switch the packet, as well asany other information (e.g. control information) needed by the switchesto switch the packet properly. The VLAN information 408 enables theswitches to determine the correct VLAN, and hence, the correct path totake to switch the packet to the destination node. In one embodiment,the path-selecting VLAN information 408 is removed from the packet whenthe packet is received. Thus, by the time the destination node gets thepacket, the VLAN information 408 will no longer be there. As a result,the destination node can remain unaware that the path-selecting VLANinformation 408 was ever in the packet. This in turn enables thepath-selection to be carried out without changing any networkingprotocols implemented by the source and destinations nodes.

In some implementations, the source and destination nodes may already beimplementing VLANs (for example, for segregation purposes). Thus, anEthernet packet may already contain a set of VLAN information. Even insuch a case, a set of path-selecting VLAN information may still be addedto the Ethernet packet. This is shown in FIG. 4C, where thepath-selecting VLAN information 408 is inserted into the packet betweenthe source MAC address 404 and the node-provided VLAN information 410.In this case, it will be the path-selecting VLAN information 408, notthe node-provided VLAN information 410, that will be used by theswitches to switch the packet through the network 300 to the destinationnode. As this example shows, path selection can be implemented even withpackets that already contain node-provided VLAN information.

To show that the network 300 of FIG. 3 still behaves like a loop-freeswitching path, reverse path learning network, reference will now bemade to an example. Suppose that node A wishes to send an Ethernetpacket to Node P. Suppose further that VLAN 1 is to be used; thus, thepacket is updated with information indicating VLAN 1 as the VLAN ofchoice. Suppose further that the switches in the path have not yetlearned the MAC address/switch port association. In such a case, whenthe packet is sent to switch a, switch a will broadcast the packet toall of its outgoing ports on which VLAN 1 is enabled. These portsinclude the port attached to MAC address B and the port labeled VLAN1,2. The port labeled 3,4 is not part of VLAN 1 and therefore would beblocked for the broadcast of this packet. The packet is sent to switchi, which in turn, broadcasts the packet onto those ports which are partof VLAN 1. In this case, these would be the link labeled 1,2 whichconnects switch i to switch b, and the link labeled VLAN 1, whichconnects switch i to switch q. Switch b broadcasts the packet to theports attached to MAC addresses C and D but not to switch j. Switch qbroadcasts the packet to switches k, m and o. Switch k broadcasts thepacket to switches c and d but not to switch r since that link is onlyenabled for VLAN 2. Likewise, switch m broadcasts the packet to switchese and f and not to switch r, and switch o broadcasts the packet toswitches g and k and not to switch r. Switch c forwards the packet tothe ports connected to MAC addresses E and F, switch d forwards to portsconnected to MAC addresses G and H, switch e forwards to ports connectedto MAC addresses I and J, switch f forwards to ports connected to MACaddresses K and L, switch g forwards to ports connected to MAC addressesM and N, and switch h forwards to ports connected to MAC addresses O andP. Node P thus receives the packet. Note that because of the treestructure on which VLAN 1 is defined, there are no loops in theswitching topology; hence, there is only one path between each pair ofend nodes for which VLAN 1 is enabled. This example demonstrates how anEthernet packet in network 300 can reach its destination without aprioriknowledge of the switching path, and is consistent with how Ethernettypically performs flooding.

As each switch switches the packet, it is also carrying out reverse pathleaning. Thus, each switch (switches h, o, q, i, a) along the pathpopulates its forwarding tables with an association between source MACaddress A, VLAN 1, and the port on which the packet was received. Thatway, when node P sends an Ethernet packet destined for node A on VLAN 1,the switches will already know how to switch that packet. Namely, thepacket will be forwarded from node P to switch h then to switch o overthe link marked 1,2 to switch q over the link marked 1 to switch i overthe link marked 1 to switch a over the link marked VLAN 1,2 to the portconnected to MAC address A, which is Node A. No flooding or broadcastingis necessary. As illustrated by this example, the reverse path learningfor a VLAN-based multi-path switching topology is just an extension(e.g. taking the VLAN into account) of the reverse path learningmethodology carried out for non-VLAN based switching topology.

Continuing the example, assume that node P wants to send an Ethernetpacket to node A, but this time over VLAN 4. Further assume that theswitches have populated their forwarding tables via reverse pathlearning from a previous Ethernet packet sent from node A to node P overVLAN 4. The Ethernet packet with VLAN 4 and destination MAC address Awill be forwarded from node P to switch h then to switch p over the linkmarked 3,4 to switch t over the link marked 4 to switch j over the linkmarked 4 to switch a over the link marked 3,4 to the port connected tonode A.

With the multiple VLANs defined between each pair of nodes, any node cansend an Ethernet packet to another node using one of the four VLANs, andhence, one of the four switching paths through the switching topology.The ability to use the four switching paths between each pair of nodeseffectively increases the cross section switching capacity of thenetwork. In the example above, there are four VLAN paths defined sothere is an increase by a factor of four to the cross section switchingcapacity. The presence of the four switching paths also provides fourpaths across which traffic can be spread. As a result, load balancingcan be performed. The manner in which load balancing can be carried outin accordance with one embodiment of the present invention will beelaborated upon in a later section.

Network Interface

As shown in FIG. 3, each node is coupled to the network 300 through acorresponding network interface 302. Basically, the network interface302 interfaces the node with the network 300 to enable the node to sendand receive sets of information (e.g. packets). In one embodiment, it isthe network interface 302 that selects which VLAN to use to transport aset of information to a destination node. It is also the networkinterface that performs the load balancing function. These aspects willbe discussed in greater detail in a later section.

For purposes of the present invention, a network interface 302 may takeon any desired form and its functionality may be implemented in anydesired manner. For example, a network interface 302 may be a physicalinterface (e.g. a network interface card) that is coupled to but isseparate from the node. As an alternative, a network interface 302 maybe a physical component that is part of the node (e.g. integrated intothe node's motherboard, integrated into the node's processor orprocessors, etc.). As a further alternative, a network interface 302 maybe a logical component (e.g. a computer program) that resides and runson the node. These and other embodiments are within the scope of thepresent invention. In any embodiment, the functionality of the networkinterface 302 may be realized using hardware (e.g. hardware logiccomponents, ASICs, etc.), software (e.g. having one or more processorsexecute one or more sets of instructions), or a combination of both.

For purposes of the present invention, a node may be any component thatcommunicates on the network. In one embodiment, a node comprises one ormore processors, and executes an operating system and one or moreapplications. In such a node, the applications and operating system mayperform some networking functions, such as preparing sets of information(e.g. packets) for sending into the network, implementing networkprotocols, determining destinations nodes, etc. However, in oneembodiment, the operating system and the applications do not participatein the selection of the VLAN, and hence, the selection of the path to betaken to transport a set of information to a destination node. In fact,the operating system and applications do not even need to be aware ofthe multiple VLANs. Rather, in one embodiment, selection of the VLAN touse in transporting a set of information is the responsibility of thenetwork interface 302. By delegating this responsibility to the networkinterface 302, it is possible to shield the operating system andapplications from the complexities of the network. As a result, it ispossible to implement the methodology of the present invention withoutmodifying any existing operating systems and applications.

FIG. 5 shows a functional block diagram of a network interface 302 inaccordance with one embodiment of the present invention. As shown, thenetwork interface 302 comprises a communication manager 502, a pathselection manager 504, and a VLAN storage 506. Generally, thecommunication manager 502 is responsible for sending and receivingcommunications to and from its corresponding node and the network. Thepath selection manager 504 is responsible for selecting a VLAN, andhence, a path for outgoing sets of information. The VLAN storage 506 isused to store information pertaining to the one or more VLANs that canbe used to transport a set of information from the corresponding node toa destination node. The functions performed by these components will beelaborated upon in the following discussion.

Sample Network Interface Operation

FIG. 6 shows a flow diagram which illustrates the manner in which anetwork interface 302 operates in accordance with one embodiment of thepresent invention. Before the operations shown in FIG. 6 are performed,a network, such as network 300 in FIG. 3, is first configured. Thenetwork 300 may be configured by a network administrator by selectingthe four switches q, r, s, and t as the root switches for theirrespective VLANs, and then running an STP for each root switch. Thiswill produce a spanning tree for each VLAN, which defines the pathsbetween all of the node pairs in the VLAN. After the four spanning treesare derived, the switches are configured such that they recognize whichlinks support which VLANs, in accordance with the derived spanningtrees. Once that is done, each of the network interfaces 302 is informedof the VLANs that it can use to transport information from a source nodeto a destination node. In network 300, the usable VLANs are VLANs 1, 2,3, and 4. This set of VLANs is stored by each network interface 302 inits VLAN storage 506 (FIG. 5). With the network 300 thus configured, thenetwork interfaces 302 are ready to facilitate communication by theirrespective nodes. In the following discussion, it will be assumed forthe sake of example that node A is the source node, node P is thedestination node, and network interface 302(A) is the interface whoseoperation is being described.

To send a set of information (e.g. an Ethernet packet) from node A tonode P, network interface 302(A), and more specifically, thecommunication manager 502 on network interface 302(A), acquires (block602 of FIG. 6) a set of information from node A. Network interface302(A) may acquire this set of information in any number of ways. Forexample, node A may simply provide the set of information to networkinterface 302(A). Node A may also provide a reference or a pointer tothe set of information, which the network interface 302(A) would use toaccess the set of information. Network interface 302(A) may also acquirethe set of information in other ways.

In one embodiment, the set of information specifies an address for thedestination node or comprises information from which the address of thedestination node may be derived. For example, the set of information mayactually include the address for node P. Alternatively, the set ofinformation may include some other information (such as a memorylocation) from which the address for node P can be derived. In such acase, the communication manager 502 on network interface 302(A) derivesthe address for node P. As a further alternative, the set of informationmay comprise other information that can be used to derive the address ofnode P.

Network interface 302(A), and more specifically, the path selectionmanager 504 on network interface 302(A), determines (block 604) a set ofvirtual networks that can be used to transport the set of information tonode P. As discussed above, at the time the network 300 is configured,each network interface 302 is informed of and stores the set of VLANs(in its VLAN storage 506) that it can use to transport sets ofinformation. Thus, network interface 302(A) accesses and consults thisinformation, and determines that, in the current example, it can useVLANs 1, 2, 3, and 4.

Thereafter, network interface 302(A), and more specifically, the pathselection manager 504 on network interface 302(A), selects (block 606)one of the VLANs to use to transport the set of information. For thesake of example, it will be assumed VLAN 1 is selected. In oneembodiment, this selection is made after the address of the destinationnode is specified or derived. Also, in one embodiment, this selection ismade in a manner that tends to balance the traffic load across themultiple VLANs. For example, the network interface 302(A) may select theVLAN randomly (if the selection process is truly random, this shouldspread traffic across the various VLANs relatively evenly). The networkinterface 302(A) may also select the VLAN in a round-robin fashion.Furthermore, the network interface 302(A) may select the VLAN based uponcurrent traffic conditions. For example, the network interface 302(A)may select the VLAN with the path that is currently experiencing thelowest traffic load, or the VLAN with the path that currently has themost available capacity for carrying traffic. Information on currenttraffic conditions may be provided to the path selection manager 504 ofnetwork interface 302(A) by a central traffic monitoring component (notshown) or may be derived based upon information gathered by the pathselection manager 504 of network interface 302(A). Based upon thisinformation, network interface 302(A) can select the VLAN in such amanner as to balance the traffic load across the multiple paths. Themanner in which load balancing can be carried out in accordance with oneembodiment of the present invention will be elaborated upon in a latersection.

After the VLAN (VLAN 1 in the current example) is selected, the networkinterface 302(A), and more specifically, the path selection manager 504of network interface 302(A), updates (block 608) the set of informationto include information indicating the particular VLAN that was selected.In one embodiment, this may be done as shown in FIGS. 4B and 4C, whereinthe path selecting VLAN information 408 is inserted into the set ofinformation. After the set of information is updated, it is sent (block610) by the network interface 302(A), and more specifically, by thecommunication manager 502 of network interface 302(A), into the network300. The switches in the network 300 then use the address and VLANinformation in the set of information to switch the set of informationto node P along VLAN 1.

On the receiving end, the network interface 302(P), and morespecifically, the communication manager 502 on network interface 302(P),receives the set of information, and removes the path-selecting VLANinformation 408 therefrom. The network interface 302(P) then passes theset of information to node P for processing. The set of information isthus delivered from node A to node P.

In one embodiment, the network interface 302(A) processes every set ofinformation destined for node P in this way. Thus, network interface302(A) may acquire another set of information from node A that isdestined for node P. For this set of information, network interface302(A) would perform the same operations as that shown in FIG. 5.However, the network interface 302(A) may select a different VLAN (VLAN2, for example) for this set of information. In general, the networkinterface 302(A) may acquire a series of information sets from node Athat are destined for node P, and may select different VLANs fordifferent information sets. By doing so, the network interface 302(A)distributes the traffic across the multiple VLANs, and hence, themultiple paths. If each network interface 302 does this, then loadbalancing can be achieved throughout the network 300. In this manner,load balancing may be implemented on a dynamic, packet by packet basis.

Alternative Embodiment

Thus far, the path selection and load balancing functions have beendescribed as being implemented by the network interface 302. While thisis an advantageous embodiment, it is not the only one. As analternative, the path selection and load balancing functions may beimplemented by a multi-path load balancing (MPLB) component that isseparate from the network interface 302. Such a component deployed inthe network 300 of FIG. 3 is shown in FIG. 7. As shown, an MPLB 702 maybe deployed between the network interface 302 of a node (e.g. networkinterface 302(A) of node A) and one of the switches (e.g. switch a) ofthe network 300. One of the advantages of this arrangement is that itrelieves the network interface 302 of all path selection and loadbalancing responsibilities. Thus, any standard network interface 302 maybe used to couple a node to the network 300. An MPLB 702 may also beused to couple other non-node components to the network 300. Thesenon-node components may be switches (e.g. switch u, switch v), routers,or any other type of network component.

In one embodiment, the MPLBs 702 are implemented at the edge of thenetwork 300. More specifically, an MPLB 702 is coupled to each of theedge links of the network 300. In network 300, the switches a through hare on the edge of the network 300, and each of these switches has twoedge links that allow external components to couple to the network 300.In such a network 300, an MPLB 702 would be coupled to each of theseedge links. Implemented in this way, the MPLBs 702 act as the border ofthe network 300. Everything above the dashed line 704 is consideredinternal to the network 300. Everything below the dashed line 704 isconsidered external to the network 300. The significance of thisinternal/external distinction is that components external to the network300 need not be aware of the multiple VLANs implemented within thenetwork 300. Hence, none of the external components (e.g. node A, nodeP, switch u, switch v) need to perform any path selection or loadbalancing functions. Instead, it is up to the MPLBs 702 to perform thesefunctions. When a set of information (e.g. a packet) from an externalcomponent enters the network 300, it is up to the MPLB 702 to (whenappropriate) select a VLAN, and hence, a path, to use to switch thepacket through the network 300. As discussed previously in connectionwith the network interface 302, this may involve inserting a set ofpath-selecting VLAN information into the packet. When a packet leavesthe network 300 to go to an external component, it is up to the MPLB 702to remove any path-selecting VLAN information from the packet beforesending it on. By doing so, the MPLB 702 makes the path selection andload balancing details completely transparent to the externalcomponents.

In the implementation where the path selection and load balancingfunctions are performed by a network interface 302, it is known that thenetwork interface 302 is coupled to a node. Because of this, certainassumptions can be made as to the types of packets that the networkinterface 302 will be handling. In the implementation where the pathselection and load balancing functions are performed by an MPLB 702,however, such assumptions cannot be made because an MPLB 702 may becoupled not just to a node but also to any other type of networkcomponent. As a result, an MPLB 702 needs to know how to handle moretypes of packets than a network interface 302. For some types ofpackets, it may not be appropriate to implement a path selection or loadbalancing function. For other types of packets, some additionalprocessing may be needed. Because of this variety, the MPLB 702 needs tobe endowed with additional capability to handle more types of packets.The handling of different packet types will be discussed in greaterdetail in later sections.

As noted above, an MPLB 702, in one embodiment, is deployed at theborder of the network 300. As a result, an MPLB 702 behaves as an accesspoint to the network 300 for external components. This access pointfunction is typically performed by an edge port of an edge switch (forexample, if MPLB 702(u) were not deployed, the access point functionwould be performed by the edge ports of edge switch c). Because an MPLB702 is now taking on the access point function of an edge port, the MPLB702, in one embodiment, performs the functions that are typicallyperformed by an edge port. This is in addition to the path selection andload balancing functions noted above.

Multi-Path Load Balancing Component

FIG. 8 shows a functional block diagram of an MPLB 702 in accordancewith one embodiment of the present invention. For the most part, theMPLB 702 comprises the same general components as the network interface302 of FIG. 5. These components include a communication manager 802, apath selection manager 804, and a VLAN storage 806. Generally, the pathselection manager 804 is responsible for selecting a VLAN, and hence, apath, to use to switch a set of information through the network 300. TheVLAN storage 806 is used to store information pertaining to the one ormore active VLANs that can be used to switch a set of informationthrough the network. The VLAN storage 806 may be populated with VLANinformation in the same manner as the VLAN storage 506 of the networkinterface 302 is populated with VLAN information. The communicationmanager 802 is responsible for interfacing an external component withthe network 300. Unlike the communication manager 502 of networkinterface 302, this communication manager 802 may be coupled not just toa node but to any other type of network component. Because of this, thecommunication manager 802 may receive various types of packets (theterms “packet” and “set of information” are used interchangeablyhereinafter). In one embodiment, additional functionality is imparted tothe communication manager 802 to enable it to handle various differenttypes of packets. In addition, in one embodiment, the communicationmanager 802 is endowed with additional functionality to enable it toperform the functions typically performed by an edge port. The operationof these components will be elaborated upon in later sections. As wasthe case with the network interface 302, for purposes of the presentinvention, the functionality of the MPLB 702 may be realized usinghardware (e.g. hardware logic components, ASICs, etc.), software (e.g.having one or more processors execute one or more sets of instructions),or a combination thereof.

Operational Overview

Each MPLB 702 may be used for ingress (to forward one or more packetsfrom an external component into the network 300) or egress (to forwardone or more packets from the network 300 out to an external component).FIG. 9 shows a high level operational flow diagram for the ingressfunctionality of an MPLB 702, in accordance with one embodiment of thepresent invention. The following discussion assumes that the network 300has already been configured and that the VLANs 1, 2, 3, 4 have alreadybeen established in the manner described previously.

In operation, an MPLB 702, and more specifically, the communicationmanager 802 on the MPLB 702, receives (block 904) a packet from anexternal component. This packet may be received from a node, a switch,or any other type of external network component. In response, thecommunication manager 802 determines (block 908) a packet type for thepacket. This determination may be made, for example, based upon thecontrol information and data in the packet. Once the packet type isdetermined, the communication manager 802 further determines (block 912)whether path selection is appropriate for this type of packet. If it isnot, then the communication manager 802 proceeds to process (block 932)the packet in a manner that is appropriate for that packet type. On theother hand, if path selection is appropriate for this type of packet,then the MPLB 702, and more specifically, the path selection manager 804of the MPLB 702, proceeds to select a path to use to transport thepacket through the network 300.

In one embodiment, the path selection manager 804 selects a path byfirst determining (block 916) a set of virtual networks that it can useto transport the packet through the network 300. In one embodiment, thepath selection manager 804 makes this determination by accessing andconsulting the information stored in the VLAN storage 806, which setsforth all of the active VLANs within network 300. In the currentexample, the active VLANs are VLANs 1, 2, 3, and 4. Given thisinformation, the path selection manager 804 selects (block 920) one ofthe VLANs to use to transport the packet. By selecting a VLAN, the pathsection manager 804 in effect selects a path (since each VLAN defines adifferent path through the network 300).

In one embodiment, this selection is made in a manner that tends tobalance the traffic load across the multiple VLANs. For example, thepath selection manager 804 may select the VLAN randomly (if theselection process is truly random, this should spread traffic across thevarious VLANs relatively evenly). The path selection manager 804 mayalso select the VLAN in a round-robin fashion. Furthermore, the pathselection manager 804 may select the VLAN based upon current trafficconditions. For example, the path selection manager 804 may select theVLAN with the path that is currently experiencing the lowest trafficload, or the VLAN with the path that currently has the most availablecapacity for carrying traffic. The path selection manager 804 may alsoselect the VLAN with the path that has the lowest current latency.Information on current traffic conditions may be provided to the pathselection manager 804 by a central traffic monitoring component (notshown) or may be derived based upon information gathered by the pathselection manager 804. Based upon this information, the path selectionmanager 804 can select the VLAN in such a manner as to balance thetraffic load across the multiple paths. The presence of the fourswitching paths also provides four paths across which traffic can bespread. As a result, load balancing can be performed. The manner inwhich load balancing can be carried out in accordance with oneembodiment of the present invention will be elaborated upon in a latersection.

After the VLAN is selected, the path selection manager 804 updates(block 924) the packet to include information indicating the particularVLAN that was selected. In one embodiment, this may be done as shown inFIGS. 4B and 4C, wherein the path selecting VLAN information 408 isinserted into the packet. After the packet is updated, it is sent (block928) by the MPLB 702, and more specifically, by the communicationmanager 802 of the MPLB 702, into the network 300. The switches in thenetwork 300 thereafter use the VLAN information in the packet to switchthe packet through the network 300 along the selected path.

The above discussion provides a high level description of the operationof the MPLB 702. To illustrate how the MPLB 702 handles specific typesof packets, reference will now be made to several specific examples.

TCP/IP and UDP/IP Packets

Suppose that an MPLB 702, and more specifically, the communicationmanager 802 of the MPLB 702, receives a TCP/IP or a UDP/IP packet froman external component. This packet may be received from a node coupledto the MPLB 702, from an external switch that has forwarded the packetto the MPLB 702, or from some other external network component. Inaddition to data, this type of packet comprises header information. Theheader information includes an Ethernet portion, which includes a sourceMAC address, a destination MAC address, and a type (which would be IP inthis case). The header information further comprises a source IPaddress, a destination IP address, a protocol type (which would beeither TCP or UDP), a TCP or UDP source port number, and a TCP or UDPdestination port number. Upon receiving the packet, the communicationmanager 802 extracts the header information therefrom, and uses theheader information to determine the packet type. From the headerinformation described above, the communication manager 802 determinesthat this packet is of the TCP/IP or UDP/IP type. In one embodiment,path selection is appropriate for this type of packet. Therefore, thecommunication manager 802 invokes the path selection manager 804 toselect a path through the network 300 for this packet.

In response to being invoked, the path selection manager 804 accessesthe VLAN storage 806 and uses the VLAN information contained therein todetermine a set of VLANs that can be used to transport the packetthrough the network 300. After the available VLANs are determined, thepath selection manager 804 selects one of the VLANs. By selecting aVLAN, the path section manager 804 in effect selects a path through thenetwork 300. In one embodiment, this VLAN selection is made in a mannerthat tends to balance the traffic load across the multiple VLANs.

After the VLAN is selected, the path selection manager 804 updates thepacket to include information indicating the particular VLAN that wasselected. In one embodiment, this may be done as shown in FIGS. 4B and4C, wherein the path selecting VLAN information 408 is inserted into thepacket. After the packet is updated, it is sent by the communicationmanager 802 into the network 300. The switches in the network 300thereafter use the address and VLAN information in the packet to switchthe packet through the network 300. In this manner, the MPLB 702implements path selection and load balancing on a TCP/IP or UDP/IP typeof packet.

In the above example, the path selection manager 804 performs pathselection on a packet-by-packet basis. In some implementations, it maybe desirable to group certain packets together into a flow, and to usethe same VLAN (and hence, the same path) for all of the packets in thatflow. To accommodate such an implementation, the path selection manager804, in one embodiment, may process the TCP/IP or UDP/IP packet asfollows.

Before selecting a VLAN from the available VLANs specified in the VLANstorage 806, the path selection manager 804 derives a flow label for thepacket. The flow label may be derived, for example, by processing theheader information in the packet through a hashing algorithm andderiving a hash code therefrom. This hash code semi-uniquely or uniquelyidentifies the flow of which the packet is a part. Once the flow labelis derived, the path selection manager 804 determines whether otherpackets having this flow label have been processed before. In oneembodiment, to make this determination, the path selection manager 804determines whether there is an already existing flow data structureassociated with this flow label.

If such a data structure already exists (thereby, indicating thatpackets associated with this flow were previously processed), then thepath selection manager 804 accesses that data structure, and extractstherefrom a VLAN ID. This VLAN ID indicates the VLAN that was selectedfor the previously processed packets in the flow. After the VLAN ID isextracted, it is compared against the available VLANs specified in theVLAN storage 806. If this VLAN is still available, it is selected as theVLAN to be used for this packet. If it is no longer available, thenanother VLAN is selected from the list of available VLANs, and that VLANID is stored into the flow data structure. That VLAN will be used forthis packet and for future packets of the flow.

If there is no currently existing flow data structure associated withthe derived flow label, then the path selection manager 804 creates anew flow data structure, and associates the flow label with that newdata structure. In addition, the path selection manager 804 selects oneof the available VLANs specified in the VLAN storage 806, and storesthat VLAN ID into the new flow data structure. By doing so, the pathselection manager 804 associates the selected VLAN with the flow. Thiswill cause this packet and future packets of the flow to use theselected VLAN. In this manner, the path selection manager 804 can causeall of the packets of a flow to use the same VLAN. By using differentVLANs for different flows, the path selection manager 804 can loadbalance across the multiple VLANs.

Topology Control Packets

As shown in FIG. 7, an MPLB 702 may be coupled to an external switch,such as switch u or v. One of the consequences of being coupled to aswitch is that the MPLB 702 may receive some of the topology controlpackets sent by that switch. In one embodiment, the MPLB 702, and morespecifically, the communication manager 802 of the MPLB 702, knows howto recognize and handle these topology control packets.

Spanning Tree BDPU

One type of topology control packet that may be sent by a switch is aspanning tree bridge protocol data unit (spanning tree BPDU) packet.This type of packet is directed to well known and specific MAC addresses(i.e. this type of packet includes within the packet a well known andspecific MAC destination address). From the well known MAC destinationaddress, it is possible for the communication manager 802 to determinethe packet type of this packet. Once the packet type is known, thecommunication manager 802 knows how to handle the packet. In oneembodiment, path selection is not appropriate for spanning tree BPDUpackets; thus, the MPLB 702 neither path selects nor load balances thesepackets. Instead, in one embodiment, the MPLB 702 just forwards thepacket unmodified. Thus, for example, if switch u (see FIG. 7) sends aspanning tree BPDU packet to MPLB 702(u), then MPLB 702(u) just forwardsthe packet unmodified to the internal switch c.

GVRP BDPU

Another type of topology control packet that may be sent by a switch isa generic attribute registration protocol (GARP) VLAN registrationprotocol (GVRP) BPDU packet. The purpose of this type of packet is toregister a VLAN (or multiple VLANs) on a particular port or link. Forexample, if switch u sends a GVRP BDPU packet to MPLB 702(u), and if thepacket indicates that VLAN X is to be registered, then it means thatswitch u is trying to register VLAN X on the external link betweenswitch u and MPLB 702(u).

Like the spanning tree BDPU, this type of packet also uses well knownand specific MAC destination addresses. Thus, based upon the MACdestination address in the packet, this type of packet can be readilyidentified by the communication manager 802 as a GVRP BDPU. Also, likethe spanning tree BDPU, path selection and load balancing is notappropriate (in one embodiment) for this type of packet. Thus, inresponse to receiving a GVRP BDPU packet, the MPLB 702, and morespecifically, the communication manager 802, forwards the packetunmodified. In an example where external switch u (see FIG. 7) sends aGVRP BPDU packet to MPLB 702(u), MPLB 702(u) would just forward thepacket to the internal switch c unmodified.

In contrast to a spanning tree BDPU packet, however, the MPLB 702(u), inone embodiment, performs additional processing in response to a GVRPBPDU packet. Specifically, the communication manager 802 of MPLB 702(u)interacts with switch c (which is implementing the GVRP protocol) toregister the VLAN indicated in the packet on the MPLBs external link.Thus, if, for example, the packet indicates that VLAN X is to beregistered, then the communication manager 802 of MPLB 702(u) wouldregister VLAN X on the external link between MPLB 702(u) and externalswitch u. Once VLAN X is registered in this way, the communicationmanager 802 of MPLB 702(u) will know that VLAN X is supported on itsexternal link and hence, will allow packets tagged with VLAN X to besent out on that link. A point to note is that, registered in this way,VLAN X is recognized by MPLB 702(u) as an external VLAN only. That VLANis not one of the internal VLANs used to switch a packet through thenetwork 300.

Multicast Registration Packets

Another type of packet that an MPLB 702 may receive from an externalcomponent is a multicast registration packet. This type of packet issent by a node to register that node to receive packets sent to amulticast address. A multicast registration packet may be sent as a GARPmulticast registration protocol (GMRP) packet or as an Internet protocolgroup multicast protocol (IGMP) packet. This type of packet uses wellknown and specific MAC destination addresses. Thus, based upon the MACdestination address in the packet, this type of packet can be readilyidentified by the communication manager 802 of an MPLB 702 as amulticast registration packet. Included with a multicast registrationpacket is a multicast address. This multicast address is the addressthat is to be programmed into the internal switches of the network 300to cause the internal switches to forward any packet sent to themulticast address to the node that is originating the multicastregistration packet. According to current standards, certain addressranges are reserved for multicast addresses; thus, from inspecting themulticast address, it can be readily determined that the address is amulticast address. A multicast registration packet may also be taggedwith an external VLAN ID. This VLAN ID indicates the external VLAN thatis to be used to carry a multicast packet to the node that isoriginating the multicast registration packet. In one embodiment, thecommunication manager 802 of an MPLB 702 processes a multicastregistration packet as follows.

Upon receiving a multicast registration packet, the communicationmanager 802 inspects the MAC destination address of the packet anddetermines that it is a multicast registration packet. In oneembodiment, path selection is appropriate for this type of packet. Thus,the communication manager 802 invokes the path selection manager 804 toselect an internal VLAN. In one embodiment, the path selection manager804 of each of the MPLBs 702 is preconfigured (e.g. given someconfiguration information) to associate certain multicast addresses withcertain internal VLANs. This configuration information may cause allmulticast addresses to be associated with the same internal VLAN (e.g.VLAN 1), or it may cause certain ranges of multicast addresses to beassociated with certain internal VLANs (e.g. all multicast addresseswithin a first range may be associated with VLAN 1, all multicastaddresses within a second range may be associated with VLAN 2, etc.).Based on the configuration information, and the multicast addressspecified in the registration packet, the path selection manager 804determines which internal VLAN it should associate with the multicastaddress, and selects that VLAN. The multicast address is effectivelymapped to this internal VLAN.

After the internal VLAN is selected, the path selection manager 804proceeds to update the multicast registration packet. Before it does so,however, it checks to see if the packet is currently tagged with anexternal VLAN ID. If it is not, then the path selection manager 804updates the packet to include information indicating the selectedinternal VLAN. This may be done as shown in FIGS. 4B and 4C, wherein thepath selecting VLAN information 408 is inserted into the packet. Afterthe packet is updated, it is sent by the communication manager 802 intothe network 300.

On the other hand, if the packet is tagged with an external VLAN ID,then the path selection manager 804 updates the packet by overwritingthe external VLAN ID in the packet with the ID of the selected internalVLAN. In effect, this maps the external VLAN and the multicast addressto the internal VLAN. As part of this mapping, the path selectionmanager 804 records the external VLAN-multicast address-internal VLANassociation. This association enables the path selection manager 804 toperform the reverse mapping when a packet leaves the network 300. Afterthe multicast registration packet is updated to replace the externalVLAN ID with the internal VLAN ID, the communication manager 802forwards the updated packet into the network 300. The multicastregistration packet is thus processed by the MPLB 702.

To illustrate the effect of the multicast registration packet on theinternal network 300, reference will be made to an example. Suppose thatnode A of FIG. 7 wishes to register to receive packets sent to multicastaddress X. In such a case, node A would send a multicast registrationpacket containing multicast address X to MPLB 702(A). For the sake ofsimplicity, it will be assumed that this packet does not include anexternal VLAN ID. Upon receiving this packet, the communication manager802 of MPLB 702(A) determines that the packet is a multicastregistration packet; thus, it invokes the path selection manager 804 toselect an internal VLAN. Based upon a set of configuration informationand the multicast address X, the path selection manager 804 selects oneof the internal VLANs (assume VLAN 1 for the sake of example). It thenupdates the packet with the selected VLAN ID. The updated packet isthereafter sent by the communication manager 802 to switch a.

Upon receiving the multicast registration packet, switch a updates itsforwarding table to indicate that all packets sent to multicast addressX should be forwarded to the port coupled to MPLB 702(A). From thepacket, switch a knows that internal VLAN 1 has been associated withmulticast address X; thus, it forwards the registration packet on to thenext higher switch in VLAN 1, which, in the network of FIG. 7, is switchj. Upon receiving the multicast registration packet, switch j updatesits forwarding table to indicate that all packets sent to multicastaddress X should be forwarded to the port coupled to switch a. From thepacket, switch j knows that internal VLAN 1 has been associated withmulticast address X; thus, it forwards the registration packet on to thenext higher switch in VLAN 1, which, in the network of FIG. 7, is rootswitch q. Upon receiving the multicast registration packet, root switchq updates its forwarding table to indicate that all packets sent tomulticast address X should be forwarded to the port coupled to switch j.Since switch q is the root switch for VLAN 1, it does not forward themulticast registration packet on to any other switch. Node A is thusregistered to receive packets sent to the multicast address X.

Suppose now that node P also wishes to register to receive packets sentto multicast address X. In such a case, node P would send a multicastregistration packet containing multicast address X to MPLB 702(P). Forthe sake of simplicity, it will be assumed that this packet does notinclude an external VLAN ID. Upon receiving this packet, thecommunication manager 802 of MPLB 702(P) determines that the packet is amulticast registration packet; thus, it invokes the path selectionmanager 804 to select an internal VLAN. Based upon a set ofconfiguration information (which should be the same as that used by MPLB702(A)) and the multicast address X, the path selection manager 804selects one of the internal VLANs (this VLAN should be the same (i.e.VLAN 1) as that selected previously by the path selection manager 804 ofMPLB 702(A)). The path selection manager 804 then updates the packetwith the selected VLAN ID. The updated packet is thereafter sent by thecommunication manager 802 to switch h.

Upon receiving the multicast registration packet, switch h updates itsforwarding table to indicate that all packets sent to multicast addressX should be forwarded to the port coupled to MPLB 702(P). From thepacket, switch h knows that internal VLAN 1 has been associated withmulticast address X; thus, it forwards the registration packet on to thenext higher switch in VLAN 1, which, in the network of FIG. 7, is switcho. Upon receiving the multicast registration packet, switch o updatesits forwarding table to indicate that all packets sent to multicastaddress X should be forwarded to the port coupled to switch h. From thepacket, switch o knows that internal VLAN 1 has been associated withmulticast address X; thus, it forwards the registration packet on to thenext higher switch in VLAN 1, which, in the network of FIG. 7, is rootswitch q. Upon receiving the multicast registration packet, root switchq updates its forwarding table to indicate that all packets sent tomulticast address X should be forwarded to the port coupled to switch o.Since switch q is the root switch for VLAN 1, it does not forward themulticast registration packet on to any other switch. Node P is thusregistered to receive packets sent to the multicast address X. In theabove manner, multiple nodes may be registered to receive packets sentto a multicast address.

Multicast Packets

The above discussion addresses the handling of a multicast registrationpacket. This discussion will focus on the processing of an actualmulticast packet, which is a data packet. To facilitate discussion,reference will be made to an example. In the following example, it willbe assumed that both nodes A and P of FIG. 7 have been registered toreceive packets sent to multicast address X. It will also be assumedthat a set of configuration information has been provided to all of theMPLBs 702, and that the configuration information specifies thatinternal VLAN 1 is to be used to carry the packets sent to multicastaddress X.

Suppose now that node P sends a data packet having multicast address Xto MPLB 702(P). From the multicast address in the packet, thecommunication manager 802 of MPLB 702(P) determines that this packet isa multicast packet. In one embodiment, path selection is appropriate forthis type of packet. Therefore, the communication manager 802 invokesthe path selection manager 804 to select a path through the network 300for this packet.

In response to being invoked, the path selection manager 804 inspectsthe multicast address X, and using the configuration information notedabove, associates the multicast address X with VLAN 1; thus, VLAN 1 isselected as the internal VLAN to use to transport this packet. As notedpreviously, the configuration information may specify that certainmulticast address ranges be mapped to certain internal VLANs. Forexample, multicast addresses within a first range may be mapped to VLAN1, while multicast addresses within a second range may be mapped to VLAN2, while multicast addresses within a third range may be mapped to VLAN3, and so forth. By mapping different multicast addresses to differentinternal VLANs, it is possible to spread multicast traffic across themultiple internal VLANs. Thus, a static version of load balancing can beachieved.

After the internal VLAN is selected, the path selection manager 804proceeds to update the packet with the ID of the selected VLAN. In oneembodiment, before it does so, the path selection manager 804 checks tosee if the packet is currently tagged with an external VLAN ID. If it isnot, then the path selection manager 804 updates the packet to includeinformation indicating the selected internal VLAN. This may be done asshown in FIGS. 4B and 4C, wherein the path selecting VLAN information408 is inserted into the packet. On the other hand, if the packet istagged with an external VLAN ID, then the path selection manager 804updates the packet by overwriting the external VLAN ID in the packetwith the ID of the selected internal VLAN. In effect, this maps theexternal VLAN and the multicast address to the selected internal VLAN.After the packet is updated with path selecting VLAN information, thecommunication manager 802 forwards the updated packet to switch h.

When switch h receives the packet, it consults its forwarding table andfinds that all packets destined for multicast address X should beforwarded to the port coupled to MPLB 702(P) (this is from the previousregistration of node P). However, because the packet was received onthat port, switch h does not forward the packet back to that port.Instead, because the packet specifies that internal VLAN 1 is to be usedto transport the packet through the network 300, switch h forwards thepacket to switch o. When switch receives the packet, it consults itsforwarding table and finds that all packets destined for multicastaddress X should be forwarded to the port coupled to switch h (again,this is from the previous registration of node P). However, because thepacket was received on that port, switch o does not forward the packetback to that port. Instead, because the packet specifies that internalVLAN 1 is to be used to transport the packet through the network 300,switch o forwards the packet to root switch q. Upon receiving themulticast packet, root switch q consults its forwarding table and seesthat all packets destined for multicast address X should be forwarded tothe port coupled to switch i (this is from the previous registration ofnode A) and the port coupled to switch o (this is from the previousregistration of node P). Since the root switch q received the multicastpacket on the port coupled to switch o, it does not forward the packetback to that port; thus, in this example, root switch q forwards thepacket just to the port coupled to switch i. When switch i receives thepacket, it consults its forwarding table and finds that all packetsdestined for multicast address X should be forwarded to the port coupledto switch a (this is from the previous registration of node A). Thus, itforwards the packet to switch a. In turn, switch a consults itsforwarding table and finds that all packets destined for multicastaddress X should be forwarded to the port coupled to MPLB 702(A) (again,this is from the previous registration of node A). Thus, it forwards thepacket to MPLB 702(A).

When the communication manager 802 of MPLB 702(A) receives the packet,it determines from the multicast address that this is a multicastpacket. The communication manager 802 then checks its records to see ifthis multicast address X has an external VLAN associated therewith(recall that an external VLAN-multicast address-internal VLANassociation may have been saved as part of the registration process fornode A). If the multicast address X does not have an external VLANassociated therewith, then the communication manager 802 removes thepath selection VLAN information from the packet and forwards it on tonode A. On the other hand, if the multicast address X does have anexternal VLAN associated with it, then the communication manager 802replaces the path selection VLAN information in the packet with theexternal VLAN ID. The communication manager 802 then forwards theupdated packet on to node A. In this manner, a multicast packet istransported through the network 300.

Egress Functionality

The above discussion describes the ingress functionality of an MPLB 702.The following discussion will describe the egress functionality. Thisegress functionality enables the MPLB 702, and more specifically, thecommunication manager 802 of the MPLB 702, to receive a packet from aswitch internal to the network 300, and to either forward that packet toan external component or to process the packet in an appropriate manner.

One type of packet that the communication manager 802 of an MPLB 702 mayreceive from an internal switch is a forwarded TCP/IP or UDP/IP packet.When it receives such a packet, the communication manager 802 processesthe packet to find a set of path-selecting VLAN information (thispath-selecting VLAN information was added to the packet by another MPLB702 when it entered the network 300). The communication manager 802removes this path-selecting VLAN information from the packet and thenforwards the packet to an external component. By doing this, thecommunication manager 802 makes the existence of the internal VLANstransparent to the external component.

Another type of packet that the communication manager 802 may receivefrom an internal switch is a GVRP declaration packet originated by oneof the root switches q, r, s, t. The purpose of this packet is to set upone or more VLANs within the network 300 (the declaration packetcontains information indicating which VLAN or VLANs are to be set up). AGVRP declaration packet is propagated from switch to switch until itreaches an MPLB 702. When the communication manager 802 of an MPLB 702receives a GVRP declaration packet, it does not forward the packet to anexternal component. Rather, the communication manager 802 sends aresponse in the form of a GVRP registration packet. The purpose of thisresponse is to acknowledge receipt of the GVRP declaration packet, andto register the one or more VLANs specified in the declaration packet onthe appropriate switches. This GVRP registration packet, which includesinformation indicating which VLAN or VLANs are to be registered, is sentby the communication manager 802 to the internal switch to which theMPLB 702 is coupled. For example, if MPLB 702(A) is sending the GVRPregistration packet, that packet would be sent to internal switch a.Upon receiving a GVRP registration packet on a particular port, theinternal switch registers the VLAN or VLANs specified in the packet onthat particular port. For example, if internal switch a receives a GVRPregistration packet from MPLB 702(A) on the port shown in FIG. 7, and ifthe registration packet indicates that VLAN 1 is to be registered, thenswitch c registers VLAN 1 on that port. Thereafter, the link betweenswitch c and MPLB(A) will support VLAN 1. In this manner, thecommunication manager 802 of an MPLB 702 participates in theestablishment of an internal VLAN. As an additional note, in oneembodiment, when the communication manager 802 of an MPLB 702participates in the VLAN establishment process, it updates the VLANstorage 806 of the MPLB 702 to include the ID of the newly establishedVLAN. By doing so, the communication manager 802 enables the pathselection manager 804 to select that VLAN in future path selection andload balancing operations.

Other Functionalities

As noted previously, because an MPLB 702 is deployed at the edge of anetwork, it performs the functions typically performed by an edge portof an edge switch. One of the typical functions that an edge portperforms (if it is so configured) is to add a default VLAN tag topackets that it processes. A default VLAN tag may be added to a packetwhen it leaves the edge port, and/or when it enters the edge port. Thisfunctionality is desirable in some contexts. In one embodiment, thecommunication manager 802 of an MPLB 702 provides this functionality.Specifically, the communication manager 802 may be configured to add adefault VLAN tag to packets ingressing the network 300 and/or add adefault VLAN tag to packets egressing the network 300. In oneembodiment, if the communication manager 802 adds a default VLAN tag toa packet ingressing the network 300, it does so before invoking the pathselection manager 804. That way, the path selection manager 804 will addthe path-selecting VLAN information (which is different from the defaultVLAN tag) to the packet after the default VLAN tag is already present.Doing things in this order ensures that it will be the path-selectingVLAN information and not the default VLAN tag that will be used by theinternal switches to switch the packet through the network 300.

Adding a default VLAN tag to packets is just one of the functions thatcan be performed by an edge port of an edge switch. For purposes of thepresent invention, the communication manager 802 may be endowed withcapability to perform any and all functions performed by an edge port ofan edge switch.

Further Alternative Embodiment

Thus far, the MPLB 702 has been described as being a separate,standalone component. It should be noted, however, that if so desired,the functionality of the MPLB 702 may be incorporated into one or moreof the edge ports of a switch. Also, each MPLB 702 has been shown asbeing coupled to only one edge port. It should be noted, however, thatif so desired, an MPLB 702 may be coupled to multiple edge ports andeven to multiple edge switches. These and other embodiments are withinthe scope of the present invention.

Load Balancing Overview

Thus far, the load balancing function performed by the path selectionmanager 504 (FIG. 5) of the network interface 302 and the path selectionmanager 804 (FIG. 8) of the MPLB 702 has been described at a relativelyhigh and general level. The following sections will describe a specificmethodology for implementing load balancing in accordance with oneembodiment of the present invention. In the following discussion,reference will be made to the network 300 shown in FIG. 7. However, itshould be noted that such reference is made for illustrative purposesonly. The load balancing concepts taught herein are not limited toimplementation within such a network. Rather, they may be appliedgenerally to any network in which multiple paths are provided betweencomponent pairs. All such applications are within the scope of thepresent invention. Also, for the sake of simplicity and example, thefollowing discussion will refer to the path selection manager 804 of theMPLB 702 as performing the load balancing operations to be described. Itshould be noted that the path selection manager 504 of the networkinterface 302 may perform the same operations as well. For purposes ofthe present invention, the functionality of the path selection manager504, 804 may be realized in any desired manner. For example, thefunctionality of the path selection manager 504, 804 may be realizedusing hardware (e.g. hardware logic components, ASICs, etc.), software(e.g. having one or more processors execute one or more sets ofinstructions), or a combination thereof.

In one embodiment, the path selection manager 804 performs loadbalancing on a “per flow” basis. That is, the path selection manager 804groups packets into flows, and sends packets onto paths as flows. Forexample, the packets associated with a first flow may be sent along afirst path (e.g. a first VLAN), while the packets associated with asecond flow may be sent along a second path (e.g. a second VLAN). Byputting different flows on different paths, the path selection manager804 can balance the load across the various paths.

For purposes of the present invention, packets may be associated with aflow based upon any desired criteria. For example, all packets havingthe same destination address may be associated with the same flow. Allpackets of the same type may be associated with the same flow. Allpackets carrying the same type of traffic may be associated with thesame flow. Further, flow association may be determined based uponinformation in the header of the packets (e.g. all packets with the samequintuple may be associated with the same flow), based upon informationin the payloads of the packets (determined based upon deep packetinspection), etc. Flow association may also be determined based uponsome additional processing. For example, a hashing algorithm may beapplied to some of the information in a packet (e.g. the information inthe header of the packet). All packets that hash to the same result maybe associated with the same flow. These and other methodologies may beused to group packets into flows. Basically, as long as a set of packetshas some commonality, they can be grouped together and be associatedwith the same flow. A flow may be a long-lived flow having a largenumber of packets, or it may be a short-lived flow having a relativelysmall number of packets.

In one embodiment, to manage a plurality of packets as a flow, the pathselection manager 804 maintains a flow data structure for each flow.Each flow data structure contains information specific to itscorresponding flow. The information that may be stored within a flowdata structure will be elaborated upon in later sections. Each flow datastructure is associated with a unique flow label. In one embodiment, theflow label is a set of information that can be derived from theinformation in each packet of a flow. For example, a flow label may be adestination address that is specified in the packet (in such a case, allpackets going to the same destination address would be part of the sameflow). The flow label may also be a hash value that would be derived byapplying a hashing algorithm to information contained within the packet.The flow label may be these and other types of information. So long as aset of information can be derived from the information in a packet, itcan be used as a flow label. The flow label will be used to determinewhich packets belong to which flows (put another way, all packets thatcause the same flow label to be derived belong to the same flow). Forexample, if the flow label is a hash value, then all packets that hashto that hash value will belong to the same flow.

In one embodiment, the path selection manager 804 performs loadbalancing at the time a new flow is started. Specifically, when a newflow is started, the path selection manager 804 determines which pathsare available for forwarding packets associated with that flow to adestination, and then selects one of those paths. The path selectionmanager 804 selects the path in such a manner that traffic load on thevarious paths is kept relatively balanced. In one embodiment, the pathselection manager 804 selects the path that is currently the leastcongested. In another embodiment, the path selection manager 804 selectsthe path randomly (if the selection is truly random, it will have thetendency to spread flows evenly across the various paths), in a roundrobin fashion, etc. These and other methods may be used to select thepath for the flow. After the path is selected, the packets associatedwith the flow are sent to the destination along the selected path.

In one embodiment, the path selection manager 804 performs loadbalancing even after a path has been selected for a flow. Specifically,while the packets associated with a flow are being forwarded along theselected path, the path selection manager 804 determines how congestedthe selected path and the other available paths are. If, for example,the selected path becomes significantly more congested than one of theother paths, then the path selection manager 804 may move the flow fromthe selected path onto the other path. Thus, the path selection manager804 has to ability to move a flow in “mid-flow” (by “mid-flow”, it ismeant that the flow has not yet terminated and that the packetsassociated with the flow are still being forwarded from one component toanother). With this ability to move a flow while it is in mid-flow, thepath selection manager 804 can balance the traffic load across multiplepaths in a very dynamic manner. As traffic conditions on the differentpaths change, the path selection manager 804 can move flows from path topath to dynamically adapt and adjust to the changes in trafficconditions. By moving flows in this manner, the path selection manager804 can keep congestion on the multiple paths relatively balanced andminimized.

Load Balancing Example

To illustrate how load balancing may be implemented in accordance withone embodiment of the present invention, reference will now be made toan example. Suppose that MPLB 702(A) (FIG. 7) receives a stream ofpackets from node A, and that the packets have some commonality so thatthey can be grouped and associated with the same flow. Suppose furtherthat all of the packets of the flow are destined for node P so that theyneed to pass through MPLB 702(P). Suppose further that the pathselection manager 804 on MPLB 702(A) can use any one of the four VLANs,and hence, any one of four paths, to forward the packets to node P. Inthis example, the four possible paths from MPLB 702(A) to MPLB 702(P)are: (1) MPLB 702(A) to switch a to switch i to switch q to switch o toswitch h to MPLB 702(P) for VLAN 1; (2) MPLB 702(A) to switch a toswitch i to switch r to switch o to switch h to MPLB 702(P) for VLAN 2;(3) MPLB 702(A) to switch a to switch j to switch s to switch p toswitch h to MPLB 702(P) for VLAN 3; and (4) MPLB 702(A) to switch a toswitch j to switch t to switch p to switch h to MPLB 702(P) for VLAN 4.Given this scenario, load balancing may be implemented as follows. Forthe sake of simplicity, the path selection manager 804 on MPLB 702(A)will hereinafter be referred to simply as the path selection manager804, and the path selection manager on MPLB 702(P) will be referred toas the path selection manager on MPLB 702(P).

Initially, node A sends the first packet of the flow to MPLB 702(A).When the communication manager 802 (FIG. 8) on MPLB 702(A) receives thispacket, it forwards the packet to the path selection manager 804. Whenthe path selection manager 804 receives the packet, it derives a flowlabel based upon information in the packet (the flow label may bederived by processing the packet in any desired manner). After the flowlabel is derived, the path selection manager 804 determines whetherthere is any existing flow data structure that has that flow labelassociated therewith. In the current example, this packet is the firstpacket of the flow; thus, there should be no existing flow datastructure having that flow label associated therewith. In such a case,the path selection manager 804 creates a new flow data structure, andassociates the newly derived flow label with the newly created flow datastructure.

Thereafter, the path selection manager 804 selects one of the VLANs touse to forward the packet to node P. By selecting one of the VLANs, thepath selection manager 804 is in effect selecting a path through thenetwork 300 that is to be used to transport the packet to node P. In oneembodiment, the path selection manager 804 selects the path (i.e. theVLAN) that is currently the least congested. In another embodiment, thepath selection manager 804 selects the path (i.e. the VLAN) randomly, ina round robin fashion, etc. These and other methods may be used toselect the path. For the sake of example, it will be assumed that thepath provided by VLAN 1 is selected. Once VLAN 1 is selected, the pathselection manager 804 stores the ID of VLAN 1 into the flow datastructure. This serves as an indication that the path provided by VLAN 1is the path that is to be used to forward packets associated with theflow. This will cause subsequent packets associated with the flow to besent to node P using VLAN 1.

After VLAN 1 is selected, the path selection manager 804 updates thepacket using the ID of VLAN 1 as the path-selecting VLAN information 408(in the manner previously described with reference to FIGS. 4B and 4C),and sends the packet into the network 300. The switches in the network300 will thereafter forward the packet to node P via the path providedby VLAN 1 (it is assumed that reverse path learning has already beenperformed).

Suppose now that the path selection manager 804 receives the secondpacket of the flow from node A. Again, the path selection manager 804derives a flow label based upon information in the packet. This flowlabel should be the same as that derived for the first packet of theflow (all packets of the flow should cause the same flow label to bederived). The path selection manager 804 again determines whether thisflow label has an existing flow data structure associated therewith.This time, the path selection manager 804 will find that the flow labelis associated with the flow data structure that was previously created.Upon learning this, the path selection manager 804 accesses the flowdata structure, and extracts therefrom the ID of VLAN 1, which waspreviously stored in the flow data structure. The path selection manager804 then updates the packet using the ID of VLAN 1 as the path-selectingVLAN information 408, and sends the packet into the network 300. Theswitches in the network 300 will thereafter forward the packet to node Pvia the path provided by VLAN 1. In this manner, the path selectionmanager 804 causes the packets associated with the same flow to be sentalong the same path.

In the manner described above, the path selection manager 804 forwards(block 1004 of FIG. 10) one or more packets associated with the flow tonode P along the path provided by VLAN 1. As the path selection manager804 is forwarding packets associated with the flow along this path, thepath selection manager 804 monitors the traffic conditions on all of theavailable paths, including the path provided by VLAN 1 and the otherpaths provided by VLANs 2-4. In one embodiment, the path selectionmanager 804 monitors the traffic conditions on the various paths bydetermining a congestion metric for each of the paths. Specifically, thepath selection manger 804 determines a congestion metric (block 1008)for the path provided by VLAN 1, and determines a congestion metric(block 1012) for each of the other paths provided by VLANs 2-4. Themanner in which these congestion metrics are determined in accordancewith one embodiment of the present invention will be elaborated upon ina later section. These congestion metrics basically provide anindication as to how congested each path currently is.

As an alternative to determining a separate congestion metric for eachof the other paths provided by VLANs 2-4, the path selection manager 804may instead determine (block 1012) a single aggregate congestion metricfor those paths. This aggregate congestion metric takes into account thecongestion on each of the paths provided by VLANs 2-4, but provides asingle congestion metric for all of those paths. In a sense, theaggregate congestion metric reflects an “average” congestion across thepaths provided by VLANs 2-4. The manner in which the aggregatecongestion metric is determined in accordance with one embodiment of thepresent invention will be elaborated upon in a later section.

Based upon the congestion metrics, the path selection manager 804determines (block 1016) whether the flow should be moved from the pathprovided by VLAN 1 to one of the other paths. In the embodiment wherethe path selection manager 804 determines a separate congestion metricfor each of the possible paths, the path selection manager 804 makesthis determination by comparing the congestion metric for the pathprovided by VLAN 1 with the congestion metric for each of the otherpaths to derive an imbalance metric for each pair of paths. For example,the path selection manager 804 derives an imbalance metric for the pathprovided by VLAN 1 and the path provided by VLAN 2, derives an imbalancemetric for the path provided by VLAN 1 and the path provided by VLAN 3,and derives an imbalance metric for the path provided by VLAN 1 and thepath provided by VLAN 4. These imbalance metrics indicate how muchcongestion difference there is between the other paths and the pathprovided by VLAN 1. In one embodiment, the largest imbalance metric isselected, and a determination is made as to whether that imbalancemetric exceeds a certain threshold. If so, then it may be worthwhile tomove the flow from the path provided by VLAN 1 to another path (the onewith the largest imbalance metric) provided by one of the other VLANs.For example, if the imbalance metric shows that one of the other pathsis significantly less congested than the path provided by VLAN 1, thenit may be worthwhile to move the flow onto that other path.

In the embodiment where the path selection manager 804 determines asingle aggregate congestion metric for the other paths provided by VLANs2-4, the path selection manager 804 may determine (block 1016) whetherthe flow should be moved by comparing the congestion metric for the pathprovided by VLAN 1 with the aggregate congestion metric to derive animbalance metric. A determination is then made as to whether theimbalance metric exceeds a certain threshold. If so, then it may beworthwhile to move the flow from the path provided by VLAN 1 to one ofthe other paths (an alternate path) provided by VLANs 2-4. In thisembodiment, because the aggregate congestion metric is an aggregatemetric and hence does not provide information as to which of the otherpaths is currently least congested, it is not immediately clear which ofthe other paths provided by VLANs 2-4 the flow should be moved to. Inone embodiment, the path selection manager 804 selects one of the otherpaths provided by VLANs 2-4 as the alternate path. For purposes of thepresent invention, the path selection manager 804 may select thealternate path in any desired manner (e.g. randomly, in a round robinfashion, etc.).

If the path selection manager 804 determines that the flow should not bemoved to another path, then the path selection manager 804 does not makeany changes to the flow data structure. In such a case, the pathselection manager 804 loops back to block 1004, and continues to forwardpackets associated with the flow to node P using the path provided byVLAN 1. The path selection manager 804 also continues to determine(blocks 1008, 1012) congestion metrics for the path provided by VLAN 1and the other paths provided by the other VLANs. In addition, the pathselection manager 804 continues to determine (block 1016), based uponthe congestion metrics for the various paths, whether to move the flowfrom the path provided by VLAN 1 to another path. Thus, the pathselection manager 804 continuously looks for the need and theopportunity to move the flow onto another path to balance the loadacross the multiple paths.

If, at some point, the path selection manager 804 does determine thatthe flow should be moved onto another path, then the path selectionmanager 804, in one embodiment, updates the flow data structure. Forexample, suppose that the path selection manager 804 determines that theflow should be moved to the path provided by VLAN 4. In such a case, thepath selection manager 804 would update the flow data structure byoverwriting the ID for VLAN 1 with the ID for VLAN 4. This will causesubsequent packets associated with the flow to be forwarded to node Palong the path provided by VLAN 4 instead of the path provided by VLAN1. In one embodiment, the path selection manager 804 moves the flow fromone path to another in such a manner that the packets of the flow willnot arrive at the destination out of order; thus, the receivingcomponent will not need to reorder the packets. The manner in which thepath selection manager 804 moves a flow from one path to another will beelaborated upon in a later section.

Even after the flow is moved to another path, the path selection manager804 still remains vigilant with regard to load balancing. Specifically,while the path selection manager 804 is forwarding packets (block 1004)associated with the flow to node P along the new, alternate path, thepath selection manager 804 continues to determine (blocks 1008, 1012)congestion metrics for the new path and the other paths provided by theother VLANs, and continues to determine (block 1016), based upon thecongestion metrics of the various paths, whether to move the flow fromthe new path to another path provided by another VLAN. By constantlylooking for load balancing opportunities in this manner, the pathselection manager 804 is able to adapt and adjust dynamically to everchanging traffic conditions on the multiple paths.

Determining Congestion Metrics

As noted above, part of the load balancing process involves determining(blocks 1008, 1012) congestion metrics for the paths between a pair ofcomponents. To illustrate how a congestion metric can be determined inaccordance with one embodiment of the present invention, reference willbe made to an example. In the following example, which is a continuationof the above example, the pair of components will be MPLB 702(A) andMPLB 702(P). The example will show how the path selection manager 804(the one on MPLB 702(A)) can determine a congestion metric for the pathprovided by VLAN 1 between MPLB 702(A) and MPLB 702(P) (this path wouldbe from MPLB 702(A) to switch a to switch i to switch q to switch o toswitch h to MPLB 702(P)). While this example will discuss only the pathprovided by VLAN 1, it should be noted that the same methodology may beused to determine the congestion metrics for the other paths betweenMPLB 702(A) and MPLB 702(P) provided by VLANs 2, 3, and 4.

In one embodiment, determining a congestion metric for a path involvesdetermining one or more latency values for that path. The latency valuesthat are determined for a path may be one-way latency values (indicatinghow much time is needed to transfer a set of information from aforwarding component to a receiving component along that path) and/orroundtrip latency values (indicating how much time is needed to transfera set of information from a forwarding component to a receivingcomponent along that path and back to the forwarding component).Determining a congestion metric for a path may also involve determiningone or more latency variation values for that path. These latency valuesand latency variation value(s), viewed alone or together, provide acongestion metric for a path, which in turn, provides an indication asto how congested that path currently is.

To determine the congestion metric for the path provided by VLAN 1, thepath selection manager 804 (the one on MPLB 702(A)) may operate asfollows. While it is forwarding packets associated with the flow fromMPLB 702(A) to node P along the path provided by VLAN 1 (in the mannerdescribed above), the path selection manager 804 at some point composesa latency request packet. In the following example, the latency requestpacket will be described as being a separate packet from the otherpackets in the flow. However, if so desired, the latency request packetmay be piggybacked onto one of the data packets of the flow.

Within the latency request packet, the path selection manager 804includes several sets of information. These sets of information mayinclude:

-   -   (1) a source address (in the current example, the source address        may be the address of MPLB 702(A) or the address of node A,        which is the source of the flow packets);    -   (2) a destination address (in the current example, the        destination address may be the address of MPLB 702(P) or the        address of node P, which is the destination of the flow        packets);    -   (3) a set of information indicating that the packet is a latency        request packet;    -   (4) a current timestamp (referred to as the initial timestamp)        provided by a clock on MPLB 702(A); and    -   (5) a set of VLAN selection information (e.g. the ID of VLAN 1)        indicating that VLAN 1 is to be used to transport the packet to        the destination address.

If so desired, other sets of information may also be included in thelatency request packet. These sets of information may include, forexample, the flow label of the flow (this allows the latency requestpacket to be associated directly with the flow), a set of informationindicating a priority level for the flow, and a set of informationindicating which VLAN should be used to transport a latency responsepacket back to the path selection manager 804.

After composing the latency request packet, the path selection manager804 forwards the packet to the communication manager 802 (FIG. 8) ofMPLB 702(A), which in turn, sends the packet into the network 300.Because the latency request packet includes VLAN selection informationspecifying that VLAN 1 is to be used to transport the packet to thedestination, the switches in the network 300 will switch the packet tothe destination along the path provided by VLAN 1. Thus, the latencyrequest packet will travel from MPLB 702(A) to switch a to switch i toswitch q to switch o to switch h to finally arrive at MPLB 702(P) (it isassumed that reverse path learning has already taken place between thetwo MPLBs).

When the communication manager 802 of MPLB 702(P) receives the packet,it determines, based upon the information in the packet, that the packetis a latency request packet. Thus, it does not forward the packet on tonode P. Rather, the communication manager 802 passes the packet to thepath selection manager of MPLB 702(P) for further processing.

Seeing that the packet is a latency request packet, the path selectionmanager of MPLB 702(P) knows that it should compose a latency responsepacket in response to the latency request packet. In one embodiment, todo so, the path selection manager of MPLB 702(P) starts with the latencyrequest packet, and makes changes and additions to it to transform itinto a latency response packet. Specifically, in one embodiment, thepath selection manager of MPLB 702(P) performs the following operations:

-   -   (1) take the source address specified in the latency request        packet and make it the destination address of the latency        response packet (this will cause the latency response packet to        be sent back to MPLB 702(A);    -   (2) insert a source address into the latency response packet; in        the current example, the inserted source address may be the        address of MPLB 702(P) (since MPLB 702(P) is the source of the        latency response packet); alternatively, the inserted source        address may be an address that is recognized by all of the        switches in the network 300 as being an address on which reverse        path leaning should not be performed;    -   (3) change the information in the latency request packet to        indicate that the packet is now a latency response packet rather        than a latency request packet;    -   (4) store a new set of VLAN selection information in the latency        response packet to indicate which VLAN is to be used to        transport the latency response packet back to MPLB 702(A); this        VLAN may be the same VLAN (VLAN 1) that was used to transport        the latency request packet to MPLB 702(P), or it may be a        different VLAN; thus, the latency request and latency response        packets may travel along different paths; and    -   (5) add one or more timestamps to the latency response packet;        in one embodiment, the path selection manager of MPLB 702(P)        adds two timestamps: (i) an arrived timestamp, which        approximately indicates a time at which the latency request        packet was received by the path selection manager of MPLB        702(P); and (ii) a return timestamp, which approximately        indicates a time at which the path selection manager of MPLB        702(P) sends the latency response packet back to MPLB 702(A); in        another embodiment, the path selection manager of MPLB 702(P)        may add just one timestamp to the latency response packet; in        such an embodiment, the timestamp may be either the arrived        timestamp or the return timestamp; in either case, the        timestamp(s) is/are provided by a clock on the MPLB 702(P).

In addition to the above information, the latency response packet mayalso include any information that was included in the latency requestpacket. This may include, for example, the initial timestamp provided bythe clock on MPLB 702(A), the flow label of the flow, and the set ofinformation indicating the priority level for the flow. This and otherinformation may be included in the latency response packet.

After composing the latency response packet, the path selection managerof MPLB 702(P) forwards the packet to the communication manager 802 ofMPLB 702(P), which in turn, sends the packet into the network 300.Eventually, the latency response packet is transported to MPLB 702(A)(again, it is assumed that reverse path learning has already taken placebetween the two MPLBs).

When the communication manager 802 of MPLB 702(A) receives the latencyresponse packet, it determines, based upon the information in thepacket, that it is a latency response packet. Thus, it does not pass thepacket on to node A. Instead, it passes the packet on to the pathselection manager 804 (the one on MPLB 702(A)) for further processing.

Upon receiving the latency response packet, the path selection manager804 obtains a current timestamp (referred to as the received timestamp)from the clock on MPLB 702(A). Then, based upon the received timestampand the various timestamps in the latency response packet, the pathselection manager 804 determines the latencies for the path provided byVLAN 1.

In the embodiment where the path selection manager on MPLB 702(P)provides only one timestamp (the arrived timestamp or the returntimestamp), the latencies can be determined as shown in FIG. 11A.Namely, the one-way latency is derived by subtracting the initialtimestamp from the arrived or return timestamp (whichever one isprovided by the path selection manager on MPLB 702(P)). The roundtriplatency is derived by subtracting the initial timestamp from thereceived timestamp. In the embodiment where the path selection manageron MPLB 702(P) provides both an arrived timestamp and a returntimestamp, the latencies can be derived as shown in FIG. 11B. Namely,the one-way latency is derived by subtracting the initial timestamp fromthe arrived timestamp. The roundtrip latency is derived by subtractingthe initial timestamp from the arrived timestamp, and adding thatdifference to the difference derived by subtracting the return timestampfrom the received timestamp. However it is derived, the one-way latencyvalue indicates how much time is currently needed to transport a set ofinformation from MPLB 702(A) to MPLB 702(P) along the path provided byVLAN 1. The roundtrip latency value indicates how much time is currentlyneeded to transport a set of information from MPLB 702(A) to MPLB 702(P)along the path provided by VLAN 1, and back to MPLB 702(A) (along anypath). In this manner, the path selection manager 804 is able to measurehow much time is needed to transport information on the path provided byVLAN 1.

In one embodiment, the path selection manager 804 repeatedly sendslatency request packets to MPLB 702(P) along the path provided by VLAN1, and repeatedly receives latency response packets in response to theselatency request packets. Thus, the path selection manager 804, over thelife of the flow, derives a plurality of one-way latency values and aplurality of roundtrip latency values for the path provided by VLAN 1.Based on this plurality of latency values, the path selection manager isable to determine a plurality of values for the path provided by VLAN 1.In one embodiment, these values include an “average” one-way latencyvalue (AOWL), an “average” roundtrip latency value (ARTL), and a latencyvariation value (LV). In one embodiment, these values may be derived asfollows.

Deriving “Average” One-Way Latency

In one embodiment, the AOWL may be derived using the following equation:

AOWL=(1−ρ_(L))*previous AOL+ρ_(L)*current one-way latency

In this equation, ρ_(L) is a constant that is used to weight the variouscomponents of the equation to give rise to a smooth “average”. In oneembodiment, ρ_(L) is a value that is between zero and one. For ease ofimplementation, ρ_(L) may be set to a value that is a factor of ½ (e.g.¼, ⅛, 1/16, 1/32, etc.). The optimal value for ρ_(L) may differ fromnetwork to network and from implementation to implementation. Thus, theoptimal value for ρ_(L) in any particular implementation may bedetermined experimentally.

To illustrate how this equation may be used, reference will be made toan example, which is a continuation of the above example. Suppose that,for the flow discussed in the above example, the path selection manager804 has not yet sent any latency request packets. Suppose now that thepath selection manager 804 sends a first latency request packet, andreceives a first latency response packet. Based upon the receivedtimestamp and the timestamp(s) in the first latency response packet, thepath selection manager 804 derives a current one-way latency value forthe path provided by VLAN 1 in the manner described in FIGS. 11A and11B. Once the current one-way latency value is derived, it is multipliedby ρ_(L). This result is added to (1−ρ_(L))*previous AOWL. However,since there is no previous AOWL (this is the first time the AOWL isbeing derived for this flow), the value of (1−ρ_(L))*previous AOWL iszero. Thus, the newly computed AOWL is equal to ρ_(L)*the currentone-way latency value. In one embodiment, this new AOWL value is storedin the flow data structure.

Suppose now that the path selection manager 804 sends a second latencyrequest packet, and receives a second latency response packet. Basedupon the received timestamp and the timestamp(s) in the second latencyresponse packet, the path selection manager 804 derives another currentone-way latency value for the path provided by VLAN 1 in the mannerdescribed in FIGS. 11A and 11B. Once the current one-way latency valueis derived, it is multiplied by ρ_(L). This result is added to(1−ρ_(L))*previous AOWL. In this case, the previous AOWL is the AOWLvalue that was previously stored in the flow data structure. After thevalue for (1−ρ_(L))*previous AOWL is computed, it is added to the valueof ρ_(L)*current one-way latency to derive the new AOWL. In oneembodiment, this new AOWL value is stored in the flow data structure,overwriting the AOWL value that was previously stored therein.

Continuing the example, suppose that the path selection manager 804sends a third latency request packet, and receives a third latencyresponse packet. Based upon the received timestamp and the timestamp(s)in the third latency response packet, the path selection manager 804derives another current one-way latency value for the path provided byVLAN 1 in the manner described in FIGS. 11A and 11B. Once the currentone-way latency value is derived, it is multiplied by ρ_(L). This resultis added to (1−ρ_(L))*previous AOWL. In this case, the previous AOWL isthe AOWL value that was previously stored in the flow data structure.After the value for (1−ρ_(L))*previous AOWL is computed, it is added tothe value of ρ_(L)*current one-way latency to derive the new AOWL. Inone embodiment, this new AOWL value is stored in the flow datastructure, overwriting the AOWL value that was previously storedtherein.

In one embodiment, the process described above is repeated for each setof latency request and latency response packets. As a result, the pathselection manager 804 constantly updates the AOWL. Notice that the AOWLis not a true average of all of the one-way latency values (that is, itis not derived by summing up an n number of one-way latency values andthen dividing the sum by n). Rather, it is more of a rolling, weightedaverage. Deriving the AOWL in this manner is simple and requires littlestorage; thus, from an implementation standpoint, it is advantageous.However, if so desired, the AOWL may be derived in any other desiredmanner. For purposes of the present invention, any desired methodologymay be used to derive the AOWL.

Deriving “Average” Roundtrip Latency

In one embodiment, the ARTL may be derived using the following equation:

ARTL=(1−ρ_(R))*previous ARTL+ρ_(R)*current roundtrip latency.

In this equation, ρ_(R) is a constant that is used to weight the variouscomponents of the equation to give rise to a smooth “average”. In oneembodiment, ρ_(R) is a value that is between zero and one. For ease ofimplementation, ρ_(R) may be set to a value that is a factor of ½ (e.g.¼, ⅛, 1/16, 1/32, etc.). The optimal value for ρ_(R) may differ fromnetwork to network and from implementation to implementation. Thus, theoptimal value for ρ_(R) in any particular implementation may bedetermined experimentally.

This equation may be used in a manner similar to that described above inconnection with the equation for AOWL. Specifically, suppose that, forthe flow discussed in the above example, the path selection manager 804sends a first latency request packet, and receives a first latencyresponse packet (these may be the same packets as those described abovein connection with deriving the AOWL). Based upon the received timestampand the timestamp(s) in the first latency response packet, the pathselection manager 804 derives a current roundtrip latency value in themanner described in FIGS. 11A and 11B. Once the current roundtriplatency value is derived, it is multiplied by ρ_(R). This result isadded to (1−ρ_(R))*previous ARTL. However, since there is no previousARTL (this is the first time the ARTL is being derived for this flow),the value of (1−ρ_(R))*previous ARTL is zero. Thus, the newly computedARTL is equal to ρ_(R)*the current roundtrip latency value. In oneembodiment, this new ARTL value is stored in the flow data structure.

Suppose now that the path selection manager 804 sends a second latencyrequest packet, and receives a second latency response packet (these maybe the same packets as those described above in connection with derivingthe AOWL). Based upon the received timestamp and the timestamp(s) in thesecond latency response packet, the path selection manager 804 derivesanother current roundtrip latency value in the manner described in FIGS.11A and 11B. Once the current roundtrip latency value is derived, it ismultiplied by ρ_(R). This result is added to (1−ρ_(R))*previous ARTL. Inthis case, the previous ARTL is the ARTL value that was previouslystored in the flow data structure. After the value for(1−ρ_(R))*previous ARTL is computed, it is added to the value ofρ_(R)*current roundtrip latency to derive the new ARTL. In oneembodiment, this new ARTL value is stored in the flow data structure,overwriting the ARTL value that was previously stored therein.

Continuing the example, suppose that the path selection manager 804sends a third latency request packet, and receives a third latencyresponse packet (these may be the same packets as those described abovein connection with deriving the AOWL). Based upon the received timestampand the timestamp(s) in the third latency response packet, the pathselection manager 804 derives another current roundtrip latency value inthe manner described in FIGS. 11A and 11B. Once the current roundtriplatency value is derived, it is multiplied by ρ_(R). This result isadded to (1−ρ_(R))*previous ARTL. In this case, the previous ARTL is theARTL value that was previously stored in the flow data structure. Afterthe value for (1−ρ_(R))*previous ARTL is computed, it is added to thevalue of ρ_(R)*current roundtrip latency to derive the new ARTL. In oneembodiment, this new ARTL value is stored in the flow data structure,overwriting the ARTL value that was previously stored therein.

In one embodiment, the process described above is repeated for each setof latency request and latency response packets. As a result, the pathselection manager 804 constantly updates the ARTL. Notice that the ARTLis not a true average of all of the roundtrip latency values (that is,it is not derived by summing up an n number of roundtrip latency valuesand then dividing the sum by n). Rather, it is more of a rolling,weighted average. Deriving the ARTL in this manner is simple andrequires little storage; thus, from an implementation standpoint, it isadvantageous. However, if so desired, the ARTL may be derived in anyother desired manner. For purposes of the present invention, any desiredmethodology may be used to derive the AOWL.

Deriving Latency Variation

In one embodiment, the LV (latency variation) may be derived using thefollowing equation:

LV=(1−ρ_(V))*previous LV+ρ_(V)*|current latency value-previous latencyvalue|.

This equation may be used to derive the latency variation for bothone-way latency values and roundtrip latency values. If the equation isused to derive the latency variation for one-way latency values, thenthe “current latency value” in the equation would be the current one-waylatency value, and the “previous latency value” would be the previousone-way latency value. If the equation is used to derive the latencyvariation for roundtrip latency values, then the “current latency value”in the equation would be the current roundtrip latency value, and the“previous latency value” would be the previous roundtrip latency value.

In this equation, ρ_(V) is a constant that is used to weight the variouscomponents of the equation. In one embodiment, ρ_(V) is a value that isbetween zero and one. For ease of implementation, may be set to a valuethat is a factor of ½ (e.g. ¼, ⅛, 1/16, 1/32, etc.). The optimal valuefor may differ from network to network and from implementation toimplementation. Thus, the optimal value for ρ_(V) in any particularimplementation may be determined experimentally.

To illustrate how this equation may be used, reference will be made toan example, which is a continuation of the above example. In thefollowing example, the equation is used to determine the latencyvariation for the one-way latency values. It should be noted that thelatency variation for roundtrip latency values may be derived in asimilar way. Suppose that, for the flow discussed in the above example,the path selection manager 804 sends a first latency request packet, andreceives a first latency response packet (these may be the same packetsas those described above in connection with deriving the AOWL). Basedupon the received timestamp and the timestamp(s) in the first latencyresponse packet, the path selection manager 804 derives a currentone-way latency value for the path provided by VLAN 1 in the mannerdescribed in FIGS. 11A and 11B. Once the current one-way latency valueis derived, the path selection manager 804 obtains from the flow datastructure a previous one-way latency value, and subtracts that previousone-way latency value from the current one-way latency value. In thecurrent example, this is the first set of latency request/responsepackets, so there is no previous one-way latency value. Thus, the resultof this subtraction is just the current one-way latency value.Thereafter, the absolute value of this subtraction result is multipliedby ρ_(V). This result is added to (1−ρ_(V))*previous LV. However, sincethere is no previous LV (this is the first time the LV is being derivedfor this flow), the value of (1−ρ_(V))*previous LV is zero. Thus, thenewly computed LV is equal to ρ_(V)*the current one-way latency value.In one embodiment, this new LV value and the current one-way latencyvalue are stored in the flow data structure.

Suppose now that the path selection manager 804 sends a second latencyrequest packet, and receives a second latency response packet (these maybe the same packets as those described above in connection with derivingthe AOWL). Based upon the received timestamp and the timestamp(s) in thesecond latency response packet, the path selection manager 804 derivesanother current one-way latency value for the path provided by VLAN 1 inthe manner described in FIGS. 11A and 11B. After the current one-waylatency value is derived, the path selection manager 804 obtains fromthe flow data structure the one-way latency value that was previouslystored therein. This previous one-way latency value is subtracted fromthe current one-way latency value, and the absolute value of the resultis multiplied by ρ_(V). This result is added to (1−ρ_(V))*previous LV.In this case, the previous LV is the LV value that was previously storedin the flow data structure. After the value for (1−ρ_(V))*previous LV iscomputed, it is added to the value of ρ_(V)*|current latencyvalue-previous latency value| to derive the new LV. In one embodiment,this new LV value is stored in the flow data structure, overwriting theLV value that was previously stored therein, and the current one-waylatency value is stored in the flow data structure, overwriting theone-way latency value that was previously stored therein.

Continuing the example, suppose that the path selection manager 804sends a third latency request packet, and receives a third latencyresponse packet (these may be the same packets as those described abovein connection with deriving the AOWL). Based upon the received timestampand the timestamp(s) in the third latency response packet, the pathselection manager 804 derives another current one-way latency value forthe path provided by VLAN 1 in the manner described in FIGS. 11A and11B. After the current one-way latency value is derived, the pathselection manager 804 obtains from the flow data structure the one-waylatency value that was previously stored therein. This previous one-waylatency value is subtracted from the current one-way latency value, andthe absolute value of the result is multiplied by ρ_(V). This result isadded to (1−ρ_(V))*previous LV. In this case, the previous LV is the LVvalue that was previously stored in the flow data structure. After thevalue for (1−ρ_(V))*previous LV is computed, it is added to the value ofρ_(V)*|current latency value-previous latency value| to derive the newLV. In one embodiment, this new LV value is stored in the flow datastructure, overwriting the LV value that was previously stored therein,and the current one-way latency value is stored in the flow datastructure, overwriting the one-way latency value that was previouslystored therein. In one embodiment, the process described above isrepeated for each set of latency request and latency response packets.As a result, the path selection manager 804 constantly updates the LVvalue. In the manner described, the path selection manager 804 cancompute and maintain a latency variation value for the one-way latencyvalues and/or the roundtrip latency values.

The above example provides just one way of computing the latencyvariation value(s). Many other methodologies may be used. For purposesof the present invention, the latency variation value(s) may be computedusing any desired methodology.

Congestion Metric

Taken alone or together, the “average” latency value(s) (AOWL and/orARTL) and the latency variation value(s) provide a congestion metric forthe path provided by VLAN 1. This congestion metric in turn provides anindication as to how congested the path provided by VLAN 1 currently is.In one embodiment, the congestion metric for a path is derived bysumming a multiple of an “average” latency value for that path with amultiple of a latency variation value for that path. Expressed inequation form, this would be:

Congestion Metric=A*“average” latency value+B*Latency Variation.

In this equation, A and B are configurable constants. In one embodiment,they are both set to 1; however, in some implementations, it may bedesirable to set these constants to other values. The congestion metricfor a path may be determined based upon one-way latency values orroundtrip latency values. If the congestion metric is determined basedupon one-way latency values, then the equation would be:

Congestion Metric=A*AOWL+B*One-Way Latency Variation.

If the congestion metric is determined based upon roundtrip latencyvalues, then the equation would be:

Congestion Metric=A*ARTL+B*Roundtrip Latency Variation.

Once a congestion metric is determined for a path, it can be comparedwith the congestion metric of another path to derive an imbalancemetric. In one embodiment, this imbalance metric may be derived bysubtracting one congestion metric from the other. This imbalance metricindicates the difference in congestion between the two paths. If thisimbalance metric is large enough (e.g. exceeds a certain threshold),thereby indicating that another path is much less congested than acurrently selected path, then it may be worthwhile for the pathselection manager 804 to move the flow from the currently selected pathto the other path. In one embodiment, a flow is moved from a currentlyselected path to another path if the following expression is true.

A*“average” latency value of current path+B*latency variation of currentpath≧C*“average” latency value of other path+D*latency variation ofother path.

In one embodiment, A=1, B=1, C=3, and D=−1. If so desired, other valuesmay be used for these constants. This expression basically determineswhether the difference in congestion metrics between a current path andanother path is sufficiently large enough to justify moving a flow fromthe current path to the other path. If so, then the move may be made. Aswill be made clear in a later section, the movement of a flow from onepath to another may not be immediate. Thus, the above expression may betrue at the time the decision is made to move the flow, but it may nolonger be true at the time the flow is actually moved. For this reason,in one embodiment, two thresholds are used. The first threshold is theabove expression with A=1, B=1, C=3, and D=−1. The second threshold isthe above expression with A=1, B=1, C=3/2, and D=−1/2. The firstthreshold is used to make the initial determination to move the flow.The second threshold (which is lower than the first threshold) is usedat the time the flow is actually to be moved. If, at the time the flowis to be moved, the second threshold is not met, then the movement ofthe flow is aborted. This may occur, for example, if some other flowshave already been moved from the current path to the other path so thatthe current path is no longer significantly more congested than theother path. If the move is aborted, then the flow simply remains on thecurrent path. In this manner, the path selection manager 804 candetermine whether to move a flow from a current path to another path.

The above example shows how the path selection manager 804 can determinea congestion metric for the path provided by VLAN 1. The samemethodology may be used to determine the congestion metrics for each ofthe other paths provided by VLANs 2-4. All that would need to be changedwould be the set of VLAN selection information that is inserted into thelatency request packets. For example, to determine the congestion metricfor the path provided by VLAN 2, the path selection manager 804 wouldinsert the ID for VLAN 2 into the latency request packets. This willcause the latency request packets to be transported from MPLB 702(A) toMPLB 702(P) along the path provided by VLAN 2, thereby enabling thelatency values for that path to be measured.

Aggregate Congestion Metric

The above discussion addresses the embodiment in which a separatecongestion metric is determined for each of the possible paths. Todescribe how an aggregate congestion metric may be determined for aplurality of paths, reference will be made to the following example,which is a continuation of the above example. In the following example,it will be assumed that the path provided by VLAN 1 is the path that iscurrently being used to forward packets associated with the flow to nodeP, and that the other available paths (the paths for which an aggregatecongestion metric is to be determined) are the paths provided by VLANs2-4.

In one embodiment, the aggregate congestion metric for a plurality ofpaths may be determined using the same equations as those given abovefor Congestion Metric, AOWL, ARTL, and LV. The difference is that thevalues that are plugged into the equations are no longer values fromjust one of the paths but rather are values from multiple paths.

To illustrate, the AOWL value for the plurality of paths provided byVLANs 2-4 may be computed as follows. Initially, the path selectionmanager 804 (the one on MPLB 702(A)) sends a latency request packet toMPLB 702(P) via the path provided by VLAN 2, and receives a latencyresponse packet from MPLB 702(P). Based upon various timestamps, thepath selection manager 804 determines (in the manner describedpreviously) a current one-way latency value for the path provided byVLAN 2. This current one-way latency value is plugged into the equationfor AOWL to derive an updated AOWL (this updated AOWL is stored).Thereafter, the path selection manager 804 sends another latency requestpacket to MPLB 702(P), this time via the path provided by VLAN 3, andreceives another latency response packet from MPLB 702(P). Based uponvarious timestamps, the path selection manager 804 determines (in themanner described previously) a current one-way latency value for thepath provided by VLAN 3. This current one-way latency value is pluggedinto the equation for AOWL, along with the stored updated AOWL, toderive another updated AOWL (this updated AOWL is stored). Thereafter,the path selection manager 804 sends another latency request packet toMPLB 702(P), this time via the path provided by VLAN 4, and receivesanother latency response packet from MPLB 702(P). Based upon varioustimestamps, the path selection manager 804 determines (in the mannerdescribed previously) a current one-way latency value for the pathprovided by VLAN 4. This current one-way latency value is plugged intothe equation for AOWL, along with the stored updated AOWL, to deriveanother updated AOWL (this updated AOWL is stored). This process may berepeated to take into account multiple current one-way latency valuesfrom each of the paths provided by VLANs 2-4. As can be seen, this AOWLis computed based upon one-way latency values from the various paths.Hence, it does not reflect the “average” one-way latency of any one pathbut rather the “average” one-way latency of the multiple paths.Consequently, it is an aggregate AOWL value for the multiple paths.

An aggregate ARTL value may be computed in a similar fashion.Specifically, the path selection manager 804 sends a latency requestpacket to MPLB 702(P) via the path provided by VLAN 2, and receives alatency response packet from MPLB 702(P). Based upon various timestamps,the path selection manager 804 determines (in the manner describedpreviously) a current roundtrip latency value for the path provided byVLAN 2. This current roundtrip latency value is plugged into theequation for ARTL to derive an updated ARTL (this updated ARTL isstored). Thereafter, the path selection manager 804 sends anotherlatency request packet to MPLB 702(P), this time via the path providedby VLAN 3, and receives another latency response packet from MPLB702(P). Based upon various timestamps, the path selection manager 804determines (in the manner described previously) a current roundtriplatency value for the path provided by VLAN 3. This current roundtriplatency value is plugged into the equation for ARTL, along with thestored updated ARTL, to derive another updated ARTL (this updated ARTLis stored). Thereafter, the path selection manager 804 sends anotherlatency request packet to MPLB 702(P), this time via the path providedby VLAN 4, and receives another latency response packet from MPLB702(P). Based upon various timestamps, the path selection manager 804determines (in the manner described previously) a current roundtriplatency value for the path provided by VLAN 4. This current roundtriplatency value is plugged into the equation for ARTL, along with thestored updated ARTL, to derive another updated ARTL (this updated ARTLis stored). This process may be repeated to take into account multiplecurrent roundtrip latency values from each of the paths provided byVLANs 2-4. As can be seen, this ARTL is computed based upon roundtriplatency values from the various paths. Hence, it is an aggregate ARTLthat reflects the “average” roundtrip latency values on those multiplepaths.

An aggregate LV value may be computed in a similar fashion. In thefollowing example, the LV equation is used to determine the latencyvariation for one-way latency values, but it should be noted that thelatency variation for roundtrip latency values may be derived in asimilar fashion. Initially, the path selection manager 804 sends alatency request packet to MPLB 702(P) via the path provided by VLAN 2,and receives a latency response packet from MPLB 702(P). Based uponvarious timestamps, the path selection manager 804 determines (in themanner described previously) a current one-way latency value for thepath provided by VLAN 2. This current one-way latency value is pluggedinto the equation for LV to derive an updated LV. The current one-waylatency value for the path provided by VLAN 2 is stored as the previousone-way latency value, and the updated LV is stored as well. Thereafter,the path selection manager 804 sends another latency request packet toMPLB 702(P), this time via the path provided by VLAN 3, and receivesanother latency response packet from MPLB 702(P). Based upon varioustimestamps, the path selection manager 804 determines (in the mannerdescribed previously) a current one-way latency value for the pathprovided by VLAN 3. This current one-way latency value is plugged intothe equation for LV, along with the previous one-way latency value andthe stored updated LV, to derive another updated LV. The current one-waylatency value for the path provided by VLAN 3 is stored as the previousone-way latency value, and the updated LV is stored as well. Thereafter,the path selection manager 804 sends another latency request packet toMPLB 702(P), this time via the path provided by VLAN 4, and receivesanother latency response packet from MPLB 702(P). Based upon varioustimestamps, the path selection manager 804 determines (in the mannerdescribed previously) a current one-way latency value for the pathprovided by VLAN 4. This current one-way latency value is plugged intothe equation for LV, along with the previous one-way latency value andthe stored updated LV, to derive another updated LV. The current one-waylatency value for the path provided by VLAN 4 is stored as the previousone-way latency value, and the updated LV is stored as well. Thisprocess may be repeated to take into account multiple current one-waylatency values from each of the paths provided by VLANs 2-4. As can beseen, this LV is computed based upon one-way latency values from thevarious paths. Hence, it is an aggregate LV that reflects the “average”latency variation across the multiple paths.

After the aggregate AOWL, ARTL, and LV values are determined, they maybe inserted into the Congestion Metric equation to compute the aggregatecongestion metric for the plurality of paths provided by VLANs 2-4. Thisaggregate congestion metric reflects an “average” congestion across themultiple paths. In the manner described, an aggregate congestion metricmay be determined for a plurality of paths.

Determining and Using Clock Offset Value

In the above discussion, various timestamps are used to determine thelatency values. Some of these timestamps (e.g. the initial timestamp andthe received timestamp) are provided by the clock on MPLB 702(A), whileother timestamps (e.g. the arrived timestamp and the return timestamp)are provided by the clock on MPLB 702(P). If these two clocks aresynchronized, then the one-way latency values derived from thesetimestamps will be accurate. However, if the clocks are notsynchronized, then the one-way latency values will be off by thedifference in the clocks. For example, if the clock on MPLB 702(P) isfaster than the clock on MPLB 702(A) by 300 milliseconds, then thederived one-way latency values will be 300 milliseconds longer than theyshould be, which will make the path appear to be slower than it is.Unfortunately, in most implementations, it is very difficult if notimpossible to keep all of the clocks on all of the components in anetwork synchronized. As a result, clock offsets are almost inevitable.

In one embodiment, the path selection manager 804 compensates for clockoffset by determining at least an approximation of the clock offsetvalue between two clocks, and then taking this clock offset value intoaccount when determining one-way latency values. By doing so, the pathselection manager 804 is able to derive more accurate measurements ofabsolute one-way latency values.

To illustrate how a clock offset value may be determined in accordancewith one embodiment of the present invention, reference will again bemade to the above example. As described above, the path selectionmanager 804 (the one on MPLB 702(A)) sends a latency request packet toMPLB 702(P) along the path provided by VLAN 1. When the path selectionmanager 804 receives a latency response packet in response to thislatency request packet, the path selection manager 804 obtains areceived timestamp from the clock on MPLB 702(A). Based upon thereceived timestamp and the one or more timestamps in the latencyresponse packet (e.g. initial timestamp, arrived timestamp, returntimestamp), the path selection manager 804 determines a currentroundtrip latency value (this roundtrip latency value may be derived inthe manner described above with reference to FIGS. 11A and 11B).

In one embodiment, after the current roundtrip latency value is derived,the path selection manager 804 determines whether the current roundtriplatency value is less than a previously established minimum roundtriplatency value. The previously established minimum roundtrip latencyvalue may be stored within the flow data structure or in some other datastructure, and is initially set to a high value. If the currentroundtrip latency value is less than the previously established minimumroundtrip latency value, then the path selection manager 804 willperform a clock offset computation. Before or after the clock offsetcomputation is performed, the path selection manager 804 overwrites thepreviously established minimum roundtrip latency value with the currentroundtrip latency value. This establishes the current roundtrip latencyvalue as the new previously established minimum roundtrip latency valuefor future calculations.

To compute the clock offset value, the path selection manager 804initially determines an estimated one-way latency value for the pathprovided by VLAN 1. In one embodiment, the path selection manager 804derives this estimated one-way latency value by dividing the currentroundtrip latency value by two (if so desired, the estimated one-waylatency value may be derived using some other computation). Thisestimation assumes that it takes approximately the same amount of timeto travel from MPLB 702(A) to MPLB 702(P) along the path provided byVLAN 1 as it does to travel from MPLB 702(P) back to MPLB 702(A). Inthis regard, the use of the minimum roundtrip latency value (which thecurrent roundtrip latency value is) is significant because it is likelyto produce the least amount of estimation error in the estimated one-waylatency value.

Once the estimated one-way latency value is calculated, the estimatedclock offset value between the clocks on MPLB 702(A) and MPLB 702(P) maybe computed as follows. In the embodiment where the path selectionmanager on MPLB 702(P) provides only one timestamp (the arrivedtimestamp or the return timestamp) in the latency request packet, thefollowing equation may be used to compute the clock offset value:

Clock offset value=(AT or RT)−IT-estimated one-way latency value;

where AT is the arrived timestamp (if any) specified in the latencyresponse packet, RT is the return timestamp (if any) specified in thelatency response packet, and IT is the initial timestamp specified inthe latency response packet (see FIG. 12A).

In the embodiment where the path selection manager on MPLB 702(P)provides both an arrived timestamp and a return timestamp in the latencyresponse packet, the following equation may be used to compute the clockoffset value:

Clock offset value=AT−IT-estimated one-way latency value;

where AT is the arrived timestamp specified in the latency responsepacket and IT is the initial timestamp specified in the latency responsepacket (see FIG. 12B).

It should be noted that this clock offset value is an estimation of theactual clock offset between the clocks on MPLB 702(A) and MPLB 702(P).Nonetheless, it can be used effectively to derive more accurate one-waylatency values. The clock offset value may be used as follows.

In the embodiment where the path selection manager on MPLB 702(P)provides only one timestamp (the arrived timestamp or the returntimestamp) in the latency response packet, the following equation may beused to derive the current one-way latency value for the path providedby VLAN 1:

Current one-way latency value=(AT or RT)−IT-clock offset value;

where AT is the arrived timestamp (if any) specified in the latencyresponse packet, RT is the return timestamp (if any) specified in thelatency response packet, and IT is the initial timestamp specified inthe latency response packet (again, see FIG. 12A).

In the embodiment where the path selection manager on MPLB 702(P)provides both an arrived timestamp and a return timestamp in the latencyresponse packet, the following equation may be used to derive thecurrent one-way latency value for the path provided by VLAN 1:

Current one-way latency value=AT−IT-clock offset value;

where AT is the arrived timestamp specified in the latency responsepacket and IT is the initial timestamp specified in the latency responsepacket (again, see FIG. 12B).

By calculating the clock offset value, and by taking it into account inthis manner, the path selection manager 804 is able to derive much moreaccurate absolute one-way latency values for a path. These more accurateabsolute one-way latency values in turn may be used to derive moreaccurate AOWL values, and more accurate one-way latency variationvalues.

In one embodiment, after the clock offset value is computed, it isstored in either the flow data structure or another data structure forfuture reference. In a future sending of a latency request packet andreceiving of a latency response packet, the calculated roundtrip latencyvalue for that latency response packet may not be less than thepreviously established minimum roundtrip latency value. In such a case,the path selection manager 804 will not recalculate the clock offsetvalue. Instead, it will access the clock offset value calculated aboveand use it to derive the one-way latency value for that latency responsepacket. Thus, once calculated, the clock offset value may be used overand over again.

In addition to having clock offset, multiple clocks may also have clockdrift. That is, their clock offset may change over time. For example, attime X, the clock on MPLB 702(P) may be faster than the clock on MPLB702(A) by 300 milliseconds but at time Y, it may be faster by 600milliseconds. To correct for this clock drift, the path selectionmanager 804, in one embodiment, periodically increases the previouslyestablished minimum roundtrip latency value. The larger the previouslyestablished minimum roundtrip latency value becomes, the more likely itwill be that a calculated roundtrip latency value for a latency responsepacket will be smaller than the previously established minimum roundtriplatency value. This in turn makes it more likely that the clock offsetvalue will be recalculated. When the clock offset value is recalculated,the clock drift will be detected and compensated for.

Controlling the Number of Latency Packets

As noted previously, over the life of the flow, the path selectionmanager 804 may send a large number of latency request packets andreceive a large number of latency response packets. The sending andreceiving of these latency packets has the potential of flooding andhence overburdening the network. In one embodiment, to prevent this fromhappening, the path selection manager 804 limits the number of latencyrequest packets that are sent.

In one embodiment, the path selection manager 804 determines the numberof latency request packets to send based upon the rate of the flow.Specifically, the path selection manager 804 determines a rate for theflow (i.e. the rate at which information associated with the flow isreceived from node A and forwarded to node P). Then, it limits thesending of the latency request packets to a rate that is a certainpercentage of the rate of the flow. Thus, if the rate of the flow is X,then the rate at which the latency request packets are sent will be acertain percentage of X (1 to 3 percent, for example). By maintainingproportionality between the rate of the flow and the rate of the latencyrequest packets, the path selection manager 804 ensures that the latencyrequest packets will not flood or overburden the network.

As an alternative, the path selection manager 804 may keep a count ofhow much information (in terms of bits or bytes) has been received andforwarded for the flow. At one or more certain points, a determinationis made as to whether the information count has reached a certainamount. When the count reaches a certain amount, a latency requestpacket is sent. At that point, the count is cleared, and the counting ofinformation restarts. When the count again reaches a certain amount,another latency request packet is sent, and the count is restarted. Bymetering the latency request packets in this manner, the path selectionmanager 804 ensures that the network traffic generated by the latencyrequest packets will be kept in proportion to the network trafficgenerated by the flow. These and other methods may be used to controlthe number of latency request packets that are sent by the pathselection manager 804.

Moving a Flow without Requiring Packet Reordering

As noted previously, when traffic conditions warrant, the path selectionmanager 804 may move a flow from one path to another. When a flow ismoved from one path to another, there is a potential that the packets ofthe flow may arrive at the destination out of order. To illustrate,suppose that a packet of a flow is forwarded to a destination along afirst path. Suppose further that after forwarding that packet, the pathselection manager 804 decides to move the flow to a second path. Whenthe path selection manager 804 receives the next packet in that flow, itwill forward that packet to the destination along the second path. Whenthat happens, a race condition arises. If conditions are right, thepacket sent along the second path may arrive at the destination beforethe packet sent along the first path. In such a case, the packets willbe out of order, which will require the destination to reorder thepackets. Packet reordering is burdensome and adds overhead andcomplexity; thus, if possible, it is desirable to avoid it.

In one embodiment of the present invention, the path selection manager804 moves a flow from one path to another in such a manner that it isensured that the packets of the flow will not arrive at the destinationout of order. Thus, it is ensured that the destination will not have toperform packet reordering.

To illustrate how this may be done in accordance with one embodiment ofthe present invention, reference will again be made to the aboveexample. Initially, the path selection manager 804 (the one on MPLB702(A)) forwards packets associated with the flow to node P along thepath provided by VLAN 1. Suppose at some point that the path selectionmanager 804 determines that the flow should be moved to the pathprovided by VLAN 4. In one embodiment, after making this determination,the path selection manager 804 does not immediately update the flow datastructure to indicate VLAN 4 instead of VLAN 1; hence, it does notimmediately start sending packets associated with the flow along thepath provided by VLAN 4. Rather, the path selection manager 804 firstsends a request packet to MPLB 702(P) along the path provided by VLAN 1.This request packet may be one of the latency request packets discussedabove. In one embodiment, at the time that it sends the request packet,the path selection manager 804 sets a “path clear” flag.

At some point, the path selection manager on MPLB 702(P) will receivethe request packet. When it does so, the path selection manager on MPLB702(P) composes and sends a response packet back to MPLB 702(A). Thisresponse packet may be one of the latency response packets discussedpreviously.

When the path selection manager 804 (the one on MPLB 702(A)) receivesthe response packet, it determines whether the “path clear” flag isstill set. In one embodiment, this flag will still be set if no packetsassociated with the flow were received and forwarded by the pathselection manager 804 between the sending of the request packet and thereceiving of the response packet. If the “path clear” flag is still set,then it means that all previously sent flow packets have reached MPLB702(A). In such a case, it is known that the path is clear of flowpackets; thus, the path selection manager 804 can move the flow to thepath provided by VLAN 4, knowing that no packet reordering will need tobe done by the destination. Thus, at that point, the path selectionmanager 804 updates the flow data structure to replace the ID for VLAN 1with the ID for VLAN 4. Future packets associated with the flow will beforwarded to the destination via the path provided by VLAN 4 instead ofthe path provided by VLAN 1.

On the other hand, if the “path clear” flag is no longer set, then itmeans that one or more intervening flow packets were received andforwarded by the path selection manager 804 between the sending of therequest packet and the receiving of the response packet. In such a case,the path selection manager 804 will repeat the above process. Namely, itwill send another request packet, set the “path clear” flag, receiveanother response packet, and check to see if the “path clear” flag isstill set at that time. Until it encounters an instance in which arequest packet is received and the “path clear” flag is still set, thepath selection manager 804 will not move the flow onto the path providedby VLAN 4.

In one embodiment, when the path selection manager 804 (the one on MPLB702(A)) receives a packet associated with the flow, it checks the “pathclear” flag. If the flag is set, it clears the flag (thereby indicatingthat the path is no longer clear). It then sends the packet to node Palong the path provided by VLAN 1 (this is so despite the fact that thepath selection manager 804 has already determined that the flow shouldbe moved to the path provided by VLAN 4). By doing so, the pathselection manager 804 in effect causes the path provided by VLAN 1 tostill be used. It will continue to use the path provided by VLAN 1 untilit can move the flow to the path provided by VLAN 4 in such a mannerthat it is ensured that the destination will not need to perform packetreordering.

Using Latencies to Determine Link Failure Timeout Period

As described previously, the path selection manager 804 can use latencyrequest packets and latency response packets to determine a plurality oflatency values for a path. With these latency values, the path selectionmanager 804 can derive an estimated latency value for that path. Forexample, the plurality of latency values may be averaged to give rise tothe estimated latency value. These and other methods may be used toderive the estimated latency value. In one embodiment of the presentinvention, this estimated latency value may be used to derive a moreaccurate link failure timeout period that will enable link failures tobe detected more quickly and accurately.

To elaborate, a link failure is typically detected by sending a packetto a receiving node along a certain path, and then waiting for aresponse. If the response is not received within a certain timeoutperiod, then it is concluded that a link failure has occurred.Typically, the timeout period is a static value that is pre-establishedby a network administrator. This static value has no correlation withthe actual performance of any path at any time. If the timeout period isset too short, then there will be an excessive number of false positives(i.e. false conclusions that a link failure has occurred when itactually has not). To avoid this result, most administrators set thetimeout period to a long period. The problem with this approach is thatthe link failure will not be detected for a long period of time. Thus,reaction to the link failure will be undesirably slow.

To enable link failures to be detected more quickly and accurately, oneembodiment of the present invention derives a link failure timeoutperiod for a path based upon the estimated latency value for that path.For purposes of the present invention, the estimated latency value maybe an estimated one-way latency value or an estimated roundtrip latencyvalue. Because each path may perform differently, each path may have adifferent link failure timeout period. In one embodiment, the linkfailure timeout period is set to a value that is a multiple of theestimated latency value (for example, the multiple may be in the rangeof 10 to 30). Because this link failure timeout period is determinedbased upon the actual latency on a path, it will provide a morerealistic and accurate timeout period with which to judge whether a linkhas failed or not. If the proper multiple is used for the propernetwork, then the optimal link failure timeout period will be derivedwhich will enable link failures to be determined with fewer, if any,false positives, and link failures to be detected faster. Also, as thelatency on the path changes, the link failure timeout period alsochanges. As a result, the link failure timeout period adapts to theperformance changes of the path.

In accordance with one embodiment of the present invention, link failuremay be detected as follows. Initially, the path selection manager 804sends a plurality of latency request packets to another component (e.g.MPLB 702(P) of FIG. 7) in the network 300 along a particular path (e.g.the path provided by VLAN 1). The path selection manager 804 alsoreceives a plurality of latency response packets from the othercomponent. Based upon various timestamps, and in the manner describedabove, the path selection manager 804 determines from these latencyresponse packets a plurality of latency values. Based upon these latencyvalues, the path selection manager 804 determines an estimated latencyvalue (for example, by averaging the latency values). Then, based uponthe estimated latency value, the path selection manager 804 determines alink failure timeout period (for example, by multiplying the estimatedlatency value by a certain factor).

Thereafter, the path selection manager 804 sends another latency requestpacket to the other component along the same path. If the path selectionmanager 804 determines that a latency response packet, which should besent by the other component in response to the latency request packet,has not been received prior to expiration of the link failure timeperiod, then the path selection manager 804 concludes that a linkfailure has occurred. At that point, the path selection manager 804 cantake whatever steps are necessary (e.g. moving a flow onto another path)to react to the link failure. By using a link failure timeout periodthat reflects the actual latency on a path, the path selection manager804 is able to detect link failures more quickly and accurately.

Flow Control at Network Border

Most switches in a network have the ability to instruct an upstreamcomponent (e.g. an upstream switch) to stop sending packets, or atleast, to slow down the rate at which packets are being sent. A switchmay do this, for example, when it detects that its buffers are full orare about to be full, and if the packet reception rate is not decreased,then the switch will have to start dropping packets. The problem with aswitch within the heart of a network exercising this capability is thatit can lead to a chain reaction of switches exercising this capability.For example, a switch may instruct an upstream switch to stop sendingpackets to it, which may cause that switch to instruct an upstreamswitch to stop sending packets to it, which may cause that switch toinstruct an upstream switch to stop sending packets to it, and so forth.Under certain conditions, this chain reaction may cause the overallnetwork to become gridlocked.

To prevent this from occurring, one embodiment of the present inventionexercises flow control at the border of the network. More specifically,in one embodiment, it is the path selection managers (on either theMPLBs 702 or the network interfaces 502) that exercise flow control. Toillustrate how this can be done, reference will again be made to theexample discussed previously, in which: (1) node A (FIG. 7) sends aplurality of packets associated with a flow to MPLB 702(A); (2) all ofthe packets of the flow are destined for node P; and (3) the pathselection manager 804 (the one on MPLB 702(A)) has selected the pathprovided by VLAN 1 to be the path to use to transport the packets tonode P.

In such a scenario, the path selection manager 804 receives the flowpackets from node A at a particular flow rate, and forwards the flowpackets to node P via the path provided by VLAN 1. As the path selectionmanager 804 is doing so, it determines a congestion metric for the pathprovided by VLAN 1 (in the manner described previously). Part of thecongestion metric will be one or more latency values for the pathprovided by VLAN 1. Based at least partially upon this congestionmetric, the path selection manager 804 determines whether a certaincongestion threshold has been reached. This congestion threshold may,for example, be a certain latency value. For instance, suppose that thepath selection manager 804 is aware that the latency on the pathprovided by VLAN 1 can only get so high before the switches in that pathstart dropping packets. In such a case, the latency value at which theswitches start dropping packets may be the congestion threshold. If thepath selection manager 804 determines that the congestion on the pathprovided by VLAN 1 has reached this congestion threshold, then itinstructs the source (node A in this example) to stop sending flowpackets, or at least, to slow the rate at which the flow packets arebeing sent. In one embodiment, as part of this instruction, the pathselection manager 804 may provide to node A sufficient information fornode A to specifically identify the flow. That way, node A can stopsending packets, or slow down the sending of packets, just for thatflow. By exercising flow control in this manner, the path selectionmanager 804 ensures that the network 300 will not become overlycongested, which in turn, eliminates the need for the switches withinthe network 300 to exercise flow control. Thus, gridlock caused by achain reaction of switches exercising flow control is prevented.

At this point, it should be noted that although the invention has beendescribed with reference to one or more specific embodiments, it shouldnot be construed to be so limited. Various modifications may be made bythose of ordinary skill in the art with the benefit of this disclosurewithout departing from the spirit of the invention. For example, thenetwork 300 shown in FIG. 3 is just a sample network. This switchingtopology can be extended to include more switches, to switches withfewer or more ports, to fewer or more hierarchical levels of switches,to fewer or more VLANs and VLAN paths, etc. These and othermodifications and extensions are possible. Thus, the invention shouldnot be limited by the specific embodiments used to illustrate it butonly by the scope of the issued claims and the equivalents thereof.

What is claimed is:
 1. A computer-implemented method comprising:maintaining, within a virtual network storage of a first component of aplurality of components coupled in communication with a network,information regarding a set of virtual networks into which the networkhas been logically divided and that can be used by the first componentto transport packets through the network, wherein each virtual networkof the set of virtual networks comprises a loop-free switching path,reverse path learning network and wherein each virtual network of theset of virtual networks provides a path through the network between thefirst component and a second component of the plurality of componentsthereby collectively providing a plurality of paths through the networkbetween the first component and the second component; receiving, by thefirst component, a packet destined for the second component; on apacket-by-packet basis or on a per flow basis, dynamically selecting, bythe first component, a particular path of the plurality of paths byselecting a virtual network of the set of virtual networks fortransporting the received packet that tends to balance traffic loadacross the set of virtual networks; and causing, by the first component,the received packet to be transported through the network to the secondcomponent via the particular path.
 2. The method of claim 1, furthercomprising monitoring, by the first component, traffic conditions forthe plurality of paths.
 3. The method of claim 2, wherein saiddynamically selecting comprises randomly selecting the particular pathfrom among the plurality of paths.
 4. The method of claim 2, whereinsaid dynamically selecting comprises selecting the particular path in around-robin fashion from among the plurality of paths.
 5. The method ofclaim 2, wherein said dynamically selecting comprises selecting theparticular path based upon the traffic conditions.
 6. The method ofclaim 5, wherein said dynamically selecting comprises selecting thevirtual network of the set of virtual networks the path of which iscurrently experiencing a lowest traffic load.
 7. The method of claim 5,wherein said dynamically selecting comprises selecting the virtualnetwork of the set of virtual networks the path of which currently has amost available capacity for carrying traffic.
 8. The method of claim 5,wherein said dynamically selecting comprises selecting the virtualnetwork of the set of virtual networks the path of which currently has alowest current latency.
 9. The method of claim 2, wherein saidmonitoring, by the first component, traffic conditions for the pluralityof paths comprises determining a latency value for each path of theplurality of paths that indicates how much time is needed for a set ofinformation to travel between the first component and the secondcomponent along the path.
 10. The method of claim 9, wherein saiddetermining a latency value for each path comprises sending, by thefirst component, a latency request packet to the second component viathe path.
 11. The method of claim 9, wherein said determining a latencyvalue for each path comprises piggy-backing on a data packet, by thefirst component, a latency request to the second component via the path.12. The method of claim 1, wherein the set of virtual networks comprisea set of virtual local area networks (VLANs).
 13. The method of claim12, wherein said causing, by the first component, the received packet tobe transported through the network to the second component via theparticular path comprises inserting a set of path-selecting VLANinformation into the received packet.
 14. The method of claim 1, whereinpackets are associated with a particular flow of a plurality of flows bythe first component based on: a destination address contained within thepackets; a packet type associated with the packets; a type of trafficcarried by the packets; information within a header of the packets; or ahashing algorithm applied to a portion of the packets.
 15. The method ofclaim 2, further comprising determining, by the first component, basedat least partially upon the traffic conditions a flow should be movedfrom the particular path to an alternate path of the plurality of paths.16. The method of claim 15, further comprising moving the flow from afirst virtual network of the set of virtual networks associated with theparticular path to a second virtual network of the set of virtualnetworks associated with the alternate path.
 17. The method of claim 16,wherein said moving occurs mid-flow.
 18. The method of claim 17, whereinsaid moving ensures packets of the flow arrive at the second componentin order.